# Michelson: the language of Smart Contracts in Tezos¶

This specification gives a detailed formal semantics of the Michelson language and a short explanation of how smart contracts are executed and interact in the blockchain.

The language is stack-based, with high level data types and primitives, and strict static type checking. Its design cherry picks traits from several language families. Vigilant readers will notice direct references to Forth, Scheme, ML and Cat.

A Michelson program is a series of instructions that are run in sequence: each instruction receives as input the stack resulting from the previous instruction, and rewrites it for the next one. The stack contains both immediate values and heap allocated structures. All values are immutable and garbage collected.

The types of the input and output stack are fixed and monomorphic, and the program is typechecked before being introduced into the system. No smart contract execution can fail because an instruction has been executed on a stack of unexpected length or contents.

This specification gives the complete instruction set, type system and semantics of the language. It is meant as a precise reference manual, not an easy introduction. Even though, some examples are provided at the end of the document and can be read first or at the same time as the specification. The document also starts with a less formal explanation of the context: how Michelson code interacts with the blockchain.

## Semantics of smart contracts and transactions¶

The Tezos ledger currently has two types of accounts that can hold tokens (and be the destinations of transactions).

An implicit account is a non programmable account, whose tokens are spendable and delegatable by a public key. Its address is directly the public key hash, and starts with

`tz1`

,`tz2`

,`tz3`

or`tz4`

.A smart contract is a programmable account. A transaction to such an address can provide data, and can fail for reasons decided by its Michelson code. Its address is a unique hash that depends on the operation that led to its creation, and starts with

`KT1`

.

From Michelson, they are indistinguishable. A safe way to think about this is to consider that implicit accounts are smart contracts that always succeed to receive tokens, and does nothing else.

Finally, addresses prefixed with `scr1`

identify smart rollups.

### Intra-transaction semantics¶

Alongside their tokens, smart contracts keep a piece of storage. Both are ruled by a specific logic specified by a Michelson program. A transaction to a smart contract will provide an input value and in option some tokens, and in return, the smart contract can modify its storage and transfer its tokens.

The Michelson program receives as input a stack containing a single pair whose first element is an input value and second element the content of the storage space. It must return a stack containing a single pair whose first element is the list of internal operations that it wants to emit, and second element is the new contents of the storage space. Alternatively, a Michelson program can fail, explicitly using a specific opcode, or because something went wrong that could not be caught by the type system (e.g. gas exhaustion).

A bit of polymorphism can be used at contract level, with a lightweight system of named entrypoints: instead of an input value, the contract can be called with an entrypoint name and an argument, and these two components are transformed automatically in a simple and deterministic way to an input value. This feature is available both for users and from Michelson code. See the dedicated section.

### Inter-transaction semantics¶

An operation included in the blockchain is a sequence of “external operations” signed as a whole by a source address. These operations are of three kinds:

Transactions to transfer tokens to implicit accounts or tokens and parameters to a smart contract (or, optionally, to a specified entrypoint of a smart contract).

Originations to create new smart contracts from its Michelson source code, an initial amount of tokens transferred from the source, and an initial storage contents.

Delegations to assign the tokens of the source to the stake of another implicit account (without transferring any tokens).

Smart contracts can also emit “internal operations”. These are run in sequence after the external transaction completes, as in the following schema for a sequence of two external operations.

```
+------+----------------+-------+----------------+
| op 1 | internal ops 1 | op 2 | internal ops 2 |
+------+----------------+-------+----------------+
```

Smart contracts called by internal transactions can in turn also emit internal operation. The interpretation of the internal operations of a given external operation uses a stack, as in the following example, also with two external operations.

```
+-----------+---------------+--------------------------+
| executing | emissions | resulting stack |
+-----------+---------------+--------------------------+
| op 1 | 1a, 1b, 1c | 1a, 1b, 1c |
| op 1a | 1ai, 1aj | 1ai, 1aj, 1b, 1c |
| op 1ai | | 1aj, 1b, 1c |
| op 1aj | | 1b, 1c |
| op 1b | 1bi | 1bi, 1c |
| op 1bi | | 1c |
| op 1c | | |
| op 2 | 2a, 2b | 2a, 2b |
| op 2a | 2ai | 2ai, 2b |
| op 2ai | 2ai1 | 2ai1, 2b |
| op 2ai1 | | 2b |
| op 2b | 2bi | 2bi |
| op 2bi | 2bi1 | 2bi1 |
| op 2bi1 | 2bi2 | 2bi2 |
| op 2bi2 | | |
+-----------+---------------+--------------------------+
```

### Failures¶

All transactions can fail for a few reasons, mostly:

Not enough tokens in the source to spend the specified amount.

The script took too many execution steps.

The script failed programmatically using the

`FAILWITH`

instruction.

External transactions can also fail for these additional reasons:

The signature of the external operations was wrong.

The code or initial storage in an origination did not typecheck.

The parameter in a transfer did not typecheck.

The destination did not exist.

The specified entrypoint did not exist.

All these errors cannot happen in internal transactions, as the type
system catches them at operation creation time. In particular,
Michelson has two types to talk about other accounts: `address`

and
`contract t`

. The `address`

type merely gives the guarantee that
the value has the form of a Tezos address. The `contract t`

type, on
the other hand, guarantees that the value is indeed a valid, existing
account whose parameter type is `t`

. To make a transaction from
Michelson, a value of type `contract t`

must be provided, and the
type system checks that the argument to the transaction is indeed of
type `t`

. Hence, all transactions made from Michelson are well
formed by construction.

In any case, when a failure happens, either total success or total failure is guaranteed. If a transaction (internal or external) fails, then the whole sequence fails and all the effects up to the failure are reverted. These transactions can still be included in blocks, and the transaction fees are given to the implicit account who baked the block.

## Language semantics¶

This specification explains in a symbolic way the computation performed by the Michelson interpreter on a given program and initial stack to produce the corresponding resulting stack. The Michelson interpreter is a pure function: it only builds a result stack from the elements of an initial one, without affecting its environment. This semantics is then naturally given in what is called a big step form: a symbolic definition of a recursive reference interpreter. This definition takes the form of a list of rules that cover all the possible inputs of the interpreter (program and stack), and describe the computation of the corresponding resulting stacks.

### Rules form and selection¶

The rules have the main following form.

```
> (syntax pattern) / (initial stack pattern) => (result stack pattern)
iff (conditions)
where (recursions)
and (more recursions)
```

The left hand side of the `=>`

sign is used for selecting the rule.
Given a program and an initial stack, one (and only one) rule can be
selected using the following process. First, the toplevel structure of
the program must match the syntax pattern. This is quite simple since
there are only a few non-trivial patterns to deal with instruction
sequences, and the rest is made of trivial patterns that match one
specific instruction. Then, the initial stack must match the initial
stack pattern. Finally, some rules add extra conditions over the values
in the stack that follow the `iff`

keyword. Sometimes, several rules
may apply in a given context. In this case, the one that appears first
in this specification is to be selected. If no rule applies, the result
is equivalent to the one for the explicit `FAILWITH`

instruction. This
case does not happen on well-typed programs, as explained in the next
section.

The right hand side describes the result of the interpreter if the rule
applies. It consists in a stack pattern, whose parts are either
constants, or elements of the context (program and initial stack) that
have been named on the left hand side of the `=>`

sign.

### Recursive rules (big step form)¶

Sometimes, the result of interpreting a program is derived from the result of interpreting another one (as in conditionals or function calls). In these cases, the rule contains a clause of the following form.

```
where (intermediate program) / (intermediate stack) => (partial result)
```

This means that this rule applies in case interpreting the intermediate state on the left gives the pattern on the right.

The left hand sign of the `=>`

sign is constructed from elements of
the initial state or other partial results, and the right hand side
identify parts that can be used to build the result stack of the rule.

If the partial result pattern does not actually match the result of the
interpretation, then the result of the whole rule is equivalent to the
one for the explicit `FAILWITH`

instruction. Again, this case does not
happen on well-typed programs, as explained in the next section.

### Format of patterns¶

Code patterns are of one of the following syntactical forms.

`INSTR`

(an uppercase identifier) is a simple instruction (e.g.`DROP`

).`INSTR (arg) ...`

is a compound instruction, whose arguments can be code, data or type patterns (e.g.`PUSH nat 3`

).`{ (instr) ; ... }`

is a possibly empty sequence of instructions, (e.g.`IF { SWAP ; DROP } { DROP }`

), nested sequences can drop the braces.`name`

is a pattern that matches any program and names a part of the matched program that can be used to build the result.`_`

is a pattern that matches any instruction.

Stack patterns are of one of the following syntactical forms.

`[FAILED]`

is the special failed state.`[]`

is the empty stack.`(top) : (rest)`

is a stack whose top element is matched by the data pattern`(top)`

on the left, and whose remaining elements are matched by the stack pattern`(rest)`

on the right (e.g.`x : y : rest`

).`name`

is a pattern that matches any stack and names it in order to use it to build the result.`_`

is a pattern that matches any stack.

Data patterns are of one of the following syntactical forms.

integer/natural number literals, (e.g.

`3`

).string literals, (e.g.

`"contents"`

).raw byte sequence literals (e.g.

`0xABCDEF42`

).`Tag`

(capitalized) is a symbolic constant, (e.g.`Unit`

,`True`

,`False`

).`(Tag (arg) ...)`

tagged constructed data, (e.g.`(Pair 3 4)`

).a code pattern for first class code values.

`name`

to name a value in order to use it to build the result.`_`

to match any value.

The domain of instruction names, symbolic constants and data constructors is fixed by this specification. Michelson does not let the programmer introduce its own types.

Be aware that the syntax used in the specification may differ from the concrete syntax. In particular some instructions are annotated with types that are not present in the concrete language because they are synthesized by the typechecker.

### Shortcuts¶

Sometimes, it is easier to think (and shorter to write) in terms of program rewriting than in terms of big step semantics. When it is the case, and when both are equivalents, we write rules of the form:

```
p / S => S''
where p' / S' => S''
```

using the following shortcut:

```
p / S => p' / S'
```

The concrete language also has some syntax sugar to group some common sequences of operations as one. This is described in this specification using a simple regular expression style recursive instruction rewriting.

## Introduction to the type system and notations¶

This specification describes a type system for Michelson. To make things clear, in particular to readers that are not accustomed to reading formal programming language specifications, it does not give a typechecking or inference algorithm. It only gives an intentional definition of what we consider to be well-typed programs. For each syntactical form, it describes the stacks that are considered well-typed inputs, and the resulting outputs.

The type system is sound, meaning that if a program can be given a type, then if run on a well-typed input stack, the interpreter will never apply an interpretation rule on a stack of unexpected length or contents. Also, it will never reach a state where it cannot select an appropriate rule to continue the execution. Well-typed programs do not block, and do not go wrong.

### Type notations¶

The specification introduces notations for the types of values, terms and stacks. Apart from a subset of value types that appear in the form of type annotations in some places throughout the language, it is important to understand that this type language only exists in the specification.

A stack type can be written:

`[]`

for the empty stack.`(top) : (rest)`

for the stack whose first value has type`(top)`

and queue has stack type`(rest)`

.

Instructions, programs and primitives of the language are also typed, their types are written:

```
(type of stack before) -> (type of stack after)
```

The types of values in the stack are written:

`identifier`

for a primitive data-type (e.g.`bool`

).`identifier (arg)`

for a parametric data-type with one parameter type`(arg)`

(e.g.`list nat`

).`identifier (arg) ...`

for a parametric data-type with several parameters (e.g.`map string int`

).`[ (type of stack before) -> (type of stack after) ]`

for a code quotation, (e.g.`[ int : int : [] -> int : [] ]`

).`lambda (arg) (ret)`

is a shortcut for`[ (arg) : [] -> (ret) : [] ]`

.

### Meta type variables¶

The typing rules introduce meta type variables. To be clear, this has
nothing to do with polymorphism, which Michelson does not have. These
variables only live at the specification level, and are used to express
the consistency between the parts of the program. For instance, the
typing rule for the `IF`

construct introduces meta variables to
express that both branches must have the same type.

Here are the notations for meta type variables:

`'a`

for a type variable.`'A`

for a stack type variable.`_`

for an anonymous type or stack type variable.

### Typing rules¶

The system is syntax directed, meaning that it defines a single typing rule for each syntax construct. A typing rule restricts the type of input stacks that are authorized for this syntax construct, links the output type to the input type, and links both of them to the subexpressions when needed, using meta type variables.

Typing rules are of the form:

```
(syntax pattern)
:: (type of stack before) -> (type of stack after) [rule-name]
iff (premises)
```

Where premises are typing requirements over subprograms or values in the
stack, both of the form `(x) :: (type)`

, meaning that value `(x)`

must have type `(type)`

.

A program is shown well-typed if one can find an instance of a rule that applies to the toplevel program expression, with all meta type variables replaced by non variable type expressions, and of which all type requirements in the premises can be proven well-typed in the same manner. For the reader unfamiliar with formal type systems, this is called building a typing derivation.

Here is an example typing derivation on a small program that computes
`(x+5)*10`

for a given input `x`

, obtained by instantiating the
typing rules for instructions `PUSH`

, `ADD`

and for the sequence, as
found in the next sections. When instantiating, we replace the `iff`

with `by`

.

```
{ PUSH nat 5 ; ADD ; PUSH nat 10 ; MUL }
:: [ nat : [] -> nat : [] ]
by { PUSH nat 5 ; ADD }
:: [ nat : [] -> nat : [] ]
by PUSH nat 5
:: [ nat : [] -> nat : nat : [] ]
by 5 :: nat
and ADD
:: [ nat : nat : [] -> nat : [] ]
and { PUSH nat 10 ; MUL }
:: [ nat : [] -> nat : [] ]
by PUSH nat 10
:: [ nat : [] -> nat : nat : [] ]
by 10 :: nat
and MUL
:: [ nat : nat : [] -> nat : [] ]
```

Producing such a typing derivation can be done in a number of manners, such as unification or abstract interpretation. In the implementation of Michelson, this is done by performing a recursive symbolic evaluation of the program on an abstract stack representing the input type provided by the programmer, and checking that the resulting symbolic stack is consistent with the expected result, also provided by the programmer.

### Side note¶

As with most type systems, it is incomplete. There are programs that cannot be given a type in this type system, yet that would not go wrong if executed. This is a necessary compromise to make the type system usable. Also, it is important to remember that the implementation of Michelson does not accept as many programs as the type system describes as well-typed. This is because the implementation uses a simple single pass typechecking algorithm, and does not handle any form of polymorphism.

## Core data types and notations¶

`string`

,`nat`

,`int`

and`bytes`

: The core primitive constant types.`bool`

: The type for booleans whose values are`True`

and`False`

.`unit`

: The type whose only value is`Unit`

, to use as a placeholder when some result or parameter is not necessary. For instance, when the only goal of a contract is to update its storage.`never`

: The empty type. Since`never`

has no inhabitant, no value of this type is allowed to occur in a well-typed program.`list (t)`

: A single, immutable, homogeneous linked list, whose elements are of type`(t)`

, and that we write`{}`

for the empty list or`{ first ; ... }`

. In the semantics, we use chevrons to denote a subsequence of elements. For instance:`{ head ; <tail> }`

.`pair (l) (r)`

: A pair of values`a`

and`b`

of types`(l)`

and`(r)`

, that we write`(Pair a b)`

.`pair (t{1}) ... (t{n})`

with`n > 2`

: A shorthand for`pair (t{1}) (pair (t{2}) ... (pair (t{n-1}) (t{n})) ...)`

.`option (t)`

: Optional value of type`(t)`

that we write`None`

or`(Some v)`

.`or (l) (r)`

: A union of two types: a value holding either a value`a`

of type`(l)`

or a value`b`

of type`(r)`

, that we write`(Left a)`

or`(Right b)`

.`set (t)`

: Immutable sets of values of type`(t)`

that we write as lists`{ item ; ... }`

, of course with their elements unique, and sorted.`map (k) (t)`

: Immutable maps from keys of type`(k)`

of values of type`(t)`

that we write`{ Elt key value ; ... }`

, with keys sorted.`big_map (k) (t)`

: Lazily deserialized maps from keys of type`(k)`

of values of type`(t)`

. These maps should be used if you intend to store large amounts of data in a map. Using`big_map`

can reduce gas costs significantly compared to standard maps, as data is lazily deserialized. Note however that individual operations on`big_map`

have higher gas costs than those over standard maps. A`big_map`

also has a lower storage cost than a standard map of the same size, when large keys are used, since only the hash of each key is stored in a`big_map`

.A

`big_map`

cannot appear inside another`big_map`

. See the section on operations on big maps for a description of the syntax of values of type`big_map (k) (t)`

and available operations.

## Core instructions¶

### Control structures¶

A detailed description of the following instructions can be found in the interactive Michelson reference manual.

`FAILWITH`

: Explicitly abort the current program (documentation).`{}`

: Empty sequence (documentation).`{ I ; C }`

: Sequence (documentation).`IF bt bf`

: Conditional branching (documentation).`LOOP body`

: A generic loop (documentation).`LOOP_LEFT body`

: A loop with an accumulator (documentation).`DIP code`

: Runs code protecting the top element of the stack (documentation).`DIP n code`

: Runs code protecting the`n`

topmost elements of the stack (documentation).`EXEC`

: Execute a function from the stack (documentation).`APPLY`

: Partially apply a tuplified function from the stack (documentation).

### Stack operations¶

A detailed description of the following instructions can be found in the interactive Michelson reference manual.

`DROP`

: Drop the top element of the stack (documentation).`DROP n`

: Drop the`n`

topmost elements of the stack (documentation).`DUP`

: Duplicate the top element of the stack (documentation).`DUP n`

: Duplicate the`n`

-th element of the stack (documentation).`SWAP`

: Exchange the top two elements of the stack (documentation).`DIG n`

: Take the element at depth`n`

of the stack and move it on top (documentation).`DUG n`

: Place the element on top of the stack at depth`n`

(documentation).`PUSH 'a x`

: Push a constant value of a given type onto the stack (documentation).`LAMBDA 'a 'b code`

: Push a lambda with the given parameter type`'a`

and return type`'b`

onto the stack (documentation).`LAMBDA_REC 'a 'b code`

: Push a recursive lambda onto the stack (documentation).

### Generic comparison¶

Comparison only works on a class of types that we call comparable. A
`COMPARE`

operation is defined in an ad hoc way for each comparable
type, but the result of compare is always an `int`

, which can in turn
be checked in a generic manner using the following combinators. The
result of `COMPARE`

is `0`

if the top two elements of the stack are
equal, negative if the first element in the stack is less than the
second, and positive otherwise.

A detailed description of the following instructions can be found in the interactive Michelson reference manual.

`EQ`

: Checks that the top element of the stack is equal to zero (documentation).`NEQ`

: Checks that the top element of the stack is not equal to zero (documentation).`LT`

: Checks that the top element of the stack is less than zero (documentation).`GT`

: Checks that the top element of the stack is greater than zero (documentation).`LE`

: Checks that the top element of the stack is less than or equal to zero (documentation).`GE`

: Checks that the top of the stack is greater than or equal to zero (documentation).

## Operations¶

### Operations on unit¶

`UNIT`

: Push a unit value onto the stack (documentation).`COMPARE`

: Unit comparison (documentation).

### Operations on type never¶

`NEVER`

: Close a forbidden branch (documentation).`COMPARE`

: Trivial comparison on type`never`

(documentation).

### Operations on booleans¶

`OR`

(documentation).`AND`

(documentation).`XOR`

(documentation).`NOT`

(documentation).`COMPARE`

: Boolean comparison (documentation).

### Operations on integers and natural numbers¶

`NEG`

(documentation).`ABS`

(documentation).`ISNAT`

(documentation).`INT`

(documentation).`ADD`

(documentation).`SUB`

(documentation).`MUL`

(documentation).`EDIV`

: Perform Euclidean division (documentation).`OR`

(documentation).`AND`

(documentation).`XOR`

(documentation).`NOT`

: Two’s complement (documentation).`LSL`

(documentation).`LSR`

(documentation).`COMPARE`

: Integer/natural comparison (documentation).

### Operations on strings¶

`CONCAT`

: String concatenation (documentation).`SIZE`

: number of characters in a string (documentation).`SLICE`

: String access (documentation).`COMPARE`

: Lexicographic comparison (documentation).

### Operations on pairs and right combs¶

The type `pair l r`

is the type of binary pairs composed of a left
element of type `l`

and a right element of type `r`

. A value of
type `pair l r`

is written `Pair x y`

where `x`

is a value of
type `l`

and `y`

is a value of type `r`

.

To build tuples of length greater than 2, right combs have specific
optimized operations. For any `n > 2`

, the compact notations ```
pair
t{0} t{1} ... t{n-2} t{n-1}
```

is provided for the type of right combs
`pair t{0} (pair t{1} ... (pair t{n-2} t{n-1}) ...)`

. Similarly, the
compact notation `Pair x{0} x{1} ... x{n-2} x{n-1}`

is provided for
the right-comb value ```
Pair x{0} (Pair x{1} ... (Pair x{n-2} x{n-1})
...)
```

. Right-comb values can also be written using sequences; ```
Pair
x{0} x{1} ... x{n-2} x{n-1}
```

can be written `{x{0}; x{1}; ...; x{n-2}; x{n-1}}`

.

`PAIR`

: Build a binary pair from the stack’s top two elements.

```
:: 'a : 'b : 'S -> pair 'a 'b : 'S
> PAIR / x : y : S => Pair x y : S
```

`PAIR n`

: Fold`n`

values on the top of the stack in a right comb.`PAIR 0`

and`PAIR 1`

are rejected.`PAIR 2`

is equivalent to`PAIR`

.

```
PAIR 2 :: 'a : 'b : 'S -> pair 'a 'b : 'S
PAIR (k+1) :: 'x : 'S -> pair 'x 'y : 'T
iff PAIR k :: 'S -> 'y : 'T
Or equivalently, for n >= 2,
PAIR n :: 'a{0} : ... : 'a{n-1} : 'A -> pair 'a{0} ... 'a{n-1} : 'A
> PAIR 2 / x : y : S => Pair x y : S
> PAIR (k+1) / x : S => Pair x y : T
iff PAIR k / S => y : T
Or equivalently, for n >= 2,
> PAIR n / x{0} : ... : x{n-1} : S => Pair x{0} ... x{n-1} : S
```

`UNPAIR`

: Split a pair into its components.

```
:: pair 'a 'b : 'S -> 'a : 'b : 'S
> UNPAIR / Pair a b : S => a : b : S
```

`UNPAIR n`

: Unfold`n`

values from a right comb on the top of the stack.`UNPAIR 0`

and`UNPAIR 1`

are rejected.`UNPAIR 2`

is equivalent to`UNPAIR`

.

```
UNPAIR 2 :: pair 'a 'b : 'A -> 'a : 'b : 'A
UNPAIR (k+1) :: pair 'a 'b : 'A -> 'a : 'B
iff UNPAIR k :: 'b : 'A -> 'B
Or equivalently, for n >= 2,
UNPAIR n :: pair 'a{0} ... 'a{n-1} : S -> 'a{0} : ... : 'a{n-1} : S
> UNPAIR 2 / Pair x y : S => x : y : S
> UNPAIR (k+1) / Pair x y : SA => x : SB
iff UNPAIR k / y : SA => SB
Or equivalently, for n >= 2,
> UNPAIR n / Pair x{0} ... x{n-1} : S => x{0} : ... : x{n-1} : S
```

`CAR`

: Access the left part of a pair.

```
:: pair 'a _ : 'S -> 'a : 'S
> CAR / Pair x _ : S => x : S
```

`CDR`

: Access the right part of a pair.

```
:: pair _ 'b : 'S -> 'b : 'S
> CDR / Pair _ y : S => y : S
```

`GET k`

: Access an element or a sub comb in a right comb.The nodes of a right comb of size

`n`

are canonically numbered as follows:

```
0
/ \
1 2
/ \
3 4
/ \
5 ...
2n-2
/ \
2n-1 2n
```

Or in plain English:

The root is numbered with 0,

The left child of the node numbered by

`k`

is numbered by`k+1`

, andThe right child of the node numbered by

`k`

is numbered by`k+2`

.

The `GET k`

instruction accesses the node numbered by `k`

. In
particular, for a comb of size `n`

, the `n-1`

first elements are
accessed by `GET 1`

, `GET 3`

, …, and `GET (2n-1)`

and the last
element is accessed by `GET (2n)`

.

```
GET 0 :: 'a : 'S -> 'a : 'S
GET 1 :: pair 'x _ : 'S -> 'x : 'S
GET (k+2) :: pair _ 'y : 'S -> 'z : 'S
iff GET k :: 'y : 'S -> 'z : 'S
Or equivalently,
GET 0 :: 'a : 'S -> 'a : 'S
GET (2k) :: pair 'a{0} ... 'a{k-1} 'a{k} : 'S -> 'a{k} : 'S
GET (2k+1) :: pair 'a{0} ... 'a{k} 'a{k+1} : 'S -> 'a{k} : 'S
> GET 0 / x : S => x : S
> GET 1 / Pair x _ : S => x : S
> GET (k+2) / Pair _ y : S => GET k / y : S
Or equivalently,
> GET 0 / x : S => x : S
> GET (2k) / Pair x{0} ... x{k-1} x{k} : 'S -> x{k} : 'S
> GET (2k+1) / Pair x{0} ... x{k} x{k+1} : 'S -> x{k} : 'S
```

`UPDATE k`

: Update an element or a sub comb in a right comb. The topmost stack element is the new value to insert in the comb, the second stack element is the right comb to update. The meaning of`k`

is the same as for the`GET k`

instruction.

```
UPDATE 0 :: 'a : 'b : 'S -> 'a : 'S
UPDATE 1 :: 'a2 : pair 'a1 'b : 'S -> pair 'a2 'b : 'S
UPDATE (k+2) :: 'c : pair 'a 'b1 : 'S -> pair 'a 'b2 : 'S
iff UPDATE k :: 'c : 'b1 : 'S -> 'b2 : 'S
Or equivalently,
UPDATE 0 :: 'a : 'b : 'S -> 'a : 'S
UPDATE (2k) :: 'c : pair 'a{0} ... 'a{k-1} 'a{k} : 'S -> pair 'a{0} ... 'a{k-1} 'c : 'S
UPDATE (2k+1) :: 'c : pair 'a{0} ... 'a{k} 'a{k+1} : 'S -> pair 'a{0} ... 'a{k-1} 'c 'a{k+1} : 'S
> UPDATE 0 / x : _ : S => x : S
> UPDATE 1 / x2 : Pair x1 y : S => Pair x2 y : S
> UPDATE (k+2) / z : Pair x y1 : S => Pair x y2 : S
iff UPDATE k / z : y1 : S => y2 : S
Or equivalently,
> UPDATE 0 / x : _ : S => x : S
> UPDATE (2k) / z : Pair x{0} ... x{k-1} x{k} : 'S => Pair x{0} ... x{k-1} z : 'S
> UPDATE (2k+1) / z : Pair x{0} ... x{k-1} x{k} x{k+1} : 'S => Pair x{0} ... x{k-1} z x{k+1} : 'S
```

`COMPARE`

: Lexicographic comparison.

```
:: pair 'a 'b : pair 'a 'b : 'S -> int : 'S
> COMPARE / (Pair sa sb) : (Pair ta tb) : S => -1 : S
iff COMPARE / sa : ta : S => -1 : S
> COMPARE / (Pair sa sb) : (Pair ta tb) : S => 1 : S
iff COMPARE / sa : ta : S => 1 : S
> COMPARE / (Pair sa sb) : (Pair ta tb) : S => r : S
iff COMPARE / sa : ta : S => 0 : S
COMPARE / sb : tb : S => r : S
```

### Operations on sets¶

`EMPTY_SET 'elt`

: Build a new, empty set for elements of a given type.The

`'elt`

type must be comparable (the`COMPARE`

primitive must be defined over it).

```
:: 'S -> set 'elt : 'S
> EMPTY_SET _ / S => {} : S
```

`MEM`

: Check for the presence of an element in a set.

```
:: 'elt : set 'elt : 'S -> bool : 'S
> MEM / x : {} : S => false : S
> MEM / x : { hd ; <tl> } : S => r : S
iff COMPARE / x : hd : [] => 1 : []
where MEM / x : { <tl> } : S => r : S
> MEM / x : { hd ; <tl> } : S => true : S
iff COMPARE / x : hd : [] => 0 : []
> MEM / x : { hd ; <tl> } : S => false : S
iff COMPARE / x : hd : [] => -1 : []
```

`UPDATE`

: Inserts or removes an element in a set, replacing a previous value.

```
:: 'elt : bool : set 'elt : 'S -> set 'elt : 'S
> UPDATE / x : false : {} : S => {} : S
> UPDATE / x : true : {} : S => { x } : S
> UPDATE / x : v : { hd ; <tl> } : S => { hd ; <tl'> } : S
iff COMPARE / x : hd : [] => 1 : []
where UPDATE / x : v : { <tl> } : S => { <tl'> } : S
> UPDATE / x : false : { hd ; <tl> } : S => { <tl> } : S
iff COMPARE / x : hd : [] => 0 : []
> UPDATE / x : true : { hd ; <tl> } : S => { hd ; <tl> } : S
iff COMPARE / x : hd : [] => 0 : []
> UPDATE / x : false : { hd ; <tl> } : S => { hd ; <tl> } : S
iff COMPARE / x : hd : [] => -1 : []
> UPDATE / x : true : { hd ; <tl> } : S => { x ; hd ; <tl> } : S
iff COMPARE / x : hd : [] => -1 : []
```

`ITER body`

: Apply the body expression to each element of a set. The body sequence has access to the stack.

```
:: (set 'elt) : 'A -> 'A
iff body :: [ 'elt : 'A -> 'A ]
> ITER body / {} : S => S
> ITER body / { hd ; <tl> } : S => ITER body / { <tl> } : S'
iff body / hd : S => S'
```

`SIZE`

: Get the cardinality of the set.

```
:: set 'elt : 'S -> nat : 'S
> SIZE / {} : S => 0 : S
> SIZE / { _ ; <tl> } : S => 1 + s : S
where SIZE / { <tl> } : S => s : S
```

### Operations on maps¶

`EMPTY_MAP 'key 'val`

: Build a new, empty map from keys of a given type to values of another given type.The

`'key`

type must be comparable (the`COMPARE`

primitive must be defined over it).

```
:: 'S -> map 'key 'val : 'S
> EMPTY_MAP _ _ / S => {} : S
```

`GET`

: Access an element in a map, returns an optional value to be checked with`IF_SOME`

.

```
:: 'key : map 'key 'val : 'S -> option 'val : 'S
> GET / x : {} : S => None : S
> GET / x : { Elt k v ; <tl> } : S => opt_y : S
iff COMPARE / x : k : [] => 1 : []
where GET / x : { <tl> } : S => opt_y : S
> GET / x : { Elt k v ; <tl> } : S => Some v : S
iff COMPARE / x : k : [] => 0 : []
> GET / x : { Elt k v ; <tl> } : S => None : S
iff COMPARE / x : k : [] => -1 : []
```

`MEM`

: Check for the presence of a binding for a key in a map.

```
:: 'key : map 'key 'val : 'S -> bool : 'S
> MEM / x : {} : S => false : S
> MEM / x : { Elt k v ; <tl> } : S => r : S
iff COMPARE / x : k : [] => 1 : []
where MEM / x : { <tl> } : S => r : S
> MEM / x : { Elt k v ; <tl> } : S => true : S
iff COMPARE / x : k : [] => 0 : []
> MEM / x : { Elt k v ; <tl> } : S => false : S
iff COMPARE / x : k : [] => -1 : []
```

`UPDATE`

: Assign or remove an element in a map.

```
:: 'key : option 'val : map 'key 'val : 'S -> map 'key 'val : 'S
> UPDATE / x : None : {} : S => {} : S
> UPDATE / x : Some y : {} : S => { Elt x y } : S
> UPDATE / x : opt_y : { Elt k v ; <tl> } : S => { Elt k v ; <tl'> } : S
iff COMPARE / x : k : [] => 1 : []
where UPDATE / x : opt_y : { <tl> } : S => { <tl'> } : S
> UPDATE / x : None : { Elt k v ; <tl> } : S => { <tl> } : S
iff COMPARE / x : k : [] => 0 : []
> UPDATE / x : Some y : { Elt k v ; <tl> } : S => { Elt k y ; <tl> } : S
iff COMPARE / x : k : [] => 0 : []
> UPDATE / x : None : { Elt k v ; <tl> } : S => { Elt k v ; <tl> } : S
iff COMPARE / x : k : [] => -1 : []
> UPDATE / x : Some y : { Elt k v ; <tl> } : S => { Elt x y ; Elt k v ; <tl> } : S
iff COMPARE / x : k : [] => -1 : []
```

`GET_AND_UPDATE`

: A combination of the`GET`

and`UPDATE`

instructions.

```
:: 'key : option 'val : map 'key 'val : 'S -> option 'val : map 'key 'val : 'S
```

This instruction is similar to `UPDATE`

but it also returns the
value that was previously stored in the `map`

at the same key as
`GET`

would.

```
> GET_AND_UPDATE / x : None : {} : S => None : {} : S
> GET_AND_UPDATE / x : Some y : {} : S => None : { Elt x y } : S
> GET_AND_UPDATE / x : opt_y : { Elt k v ; <tl> } : S => opt_y' : { Elt k v ; <tl'> } : S
iff COMPARE / x : k : [] => 1 : []
where GET_AND_UPDATE / x : opt_y : { <tl> } : S => opt_y' : { <tl'> } : S
> GET_AND_UPDATE / x : None : { Elt k v ; <tl> } : S => Some v : { <tl> } : S
iff COMPARE / x : k : [] => 0 : []
> GET_AND_UPDATE / x : Some y : { Elt k v ; <tl> } : S => Some v : { Elt k y ; <tl> } : S
iff COMPARE / x : k : [] => 0 : []
> GET_AND_UPDATE / x : None : { Elt k v ; <tl> } : S => None : { Elt k v ; <tl> } : S
iff COMPARE / x : k : [] => -1 : []
> GET_AND_UPDATE / x : Some y : { Elt k v ; <tl> } : S => None : { Elt x y ; Elt k v ; <tl> } : S
iff COMPARE / x : k : [] => -1 : []
```

`MAP body`

: Apply the body expression to each element of a map. The body sequence has access to the stack.

```
:: (map 'key 'val) : 'A -> (map 'key 'b) : 'A
iff body :: [ (pair 'key 'val) : 'A -> 'b : 'A ]
> MAP body / {} : S => {} : S
> MAP body / { Elt k v ; <tl> } : S => { Elt k v' ; <tl'> } : S''
where body / Pair k v : S => v' : S'
and MAP body / { <tl> } : S' => { <tl'> } : S''
```

`ITER body`

: Apply the body expression to each element of a map. The body sequence has access to the stack.

```
:: (map 'elt 'val) : 'A -> 'A
iff body :: [ (pair 'elt 'val : 'A) -> 'A ]
> ITER body / {} : S => S
> ITER body / { Elt k v ; <tl> } : S => ITER body / { <tl> } : S'
iff body / (Pair k v) : S => S'
```

`SIZE`

: Get the cardinality of the map.

```
:: map 'key 'val : 'S -> nat : 'S
> SIZE / {} : S => 0 : S
> SIZE / { _ ; <tl> } : S => 1 + s : S
where SIZE / { <tl> } : S => s : S
```

### Operations on `big_maps`

¶

Big maps have three possible representations. A map literal is always a valid representation for a big map. Big maps can also be represented by integers called big-map identifiers. Finally, big maps can be represented as pairs of a big-map identifier (an integer) and a big-map diff (written in the same syntax as a map whose values are options).

So for example, `{ Elt "bar" True ; Elt "foo" False }`

, `42`

, and
`Pair 42 { Elt "foo" (Some False) }`

are all valid representations
of type `big_map string bool`

.

The behavior of big-map operations is the same as if they were normal maps, except that under the hood, the elements are loaded and deserialized on demand.

`EMPTY_BIG_MAP 'key 'val`

: Build a new, empty big map from keys of a given type to values of another given type.The

`'key`

type must be comparable (the`COMPARE`

primitive must be defined over it).

```
:: 'S -> map 'key 'val : 'S
```

`GET`

: Access an element in a`big_map`

, returns an optional value to be checked with`IF_SOME`

.

```
:: 'key : big_map 'key 'val : 'S -> option 'val : 'S
```

`MEM`

: Check for the presence of an element in a`big_map`

.

```
:: 'key : big_map 'key 'val : 'S -> bool : 'S
```

`UPDATE`

: Assign or remove an element in a`big_map`

.

```
:: 'key : option 'val : big_map 'key 'val : 'S -> big_map 'key 'val : 'S
```

`GET_AND_UPDATE`

: A combination of the`GET`

and`UPDATE`

instructions.

```
:: 'key : option 'val : big_map 'key 'val : 'S -> option 'val : big_map 'key 'val : 'S
```

This instruction is similar to `UPDATE`

but it also returns the
value that was previously stored in the `big_map`

at the same key as
`GET`

would.

### Operations on optional values¶

`SOME`

: Pack a value as an optional value.

```
:: 'a : 'S -> option 'a : 'S
> SOME / v : S => (Some v) : S
```

`NONE 'a`

: The absent optional value.

```
:: 'S -> option 'a : 'S
> NONE / S => None : S
```

`IF_NONE bt bf`

: Inspect an optional value.

```
:: option 'a : 'A -> 'B
iff bt :: [ 'A -> 'B]
bf :: [ 'a : 'A -> 'B]
> IF_NONE bt bf / (None) : S => bt / S
> IF_NONE bt bf / (Some a) : S => bf / a : S
```

`COMPARE`

: Optional values comparison

```
:: option 'a : option 'a : 'S -> int : 'S
> COMPARE / None : None : S => 0 : S
> COMPARE / None : (Some _) : S => -1 : S
> COMPARE / (Some _) : None : S => 1 : S
> COMPARE / (Some a) : (Some b) : S => COMPARE / a : b : S
```

`MAP body`

: Apply the body expression to the value inside the option if there is one.

```
:: option 'a : 'S -> option 'b : 'S
iff body :: [ 'a : 'S -> 'b : 'S ]
> MAP body / None : S => None : S
> MAP body / (Some a) : S => (Some b) : S'
where body / a : S => b : S'
```

### Operations on unions¶

`LEFT 'b`

: Pack a value in a union (left case).

```
:: 'a : 'S -> or 'a 'b : 'S
> LEFT / v : S => (Left v) : S
```

`RIGHT 'a`

: Pack a value in a union (right case).

```
:: 'b : 'S -> or 'a 'b : 'S
> RIGHT / v : S => (Right v) : S
```

`IF_LEFT bt bf`

: Inspect a value of a union.

```
:: or 'a 'b : 'A -> 'B
iff bt :: [ 'a : 'A -> 'B]
bf :: [ 'b : 'A -> 'B]
> IF_LEFT bt bf / (Left a) : S => bt / a : S
> IF_LEFT bt bf / (Right b) : S => bf / b : S
```

`COMPARE`

: Unions comparison

```
:: or 'a 'b : or 'a 'b : 'S -> int : 'S
> COMPARE / (Left a) : (Left b) : S => COMPARE / a : b : S
> COMPARE / (Left _) : (Right _) : S => -1 : S
> COMPARE / (Right _) : (Left _) : S => 1 : S
> COMPARE / (Right a) : (Right b) : S => COMPARE / a : b : S
```

### Operations on lists¶

`CONS`

: Prepend an element to a list.

```
:: 'a : list 'a : 'S -> list 'a : 'S
> CONS / a : { <l> } : S => { a ; <l> } : S
```

`NIL 'a`

: The empty list.

```
:: 'S -> list 'a : 'S
> NIL / S => {} : S
```

`IF_CONS bt bf`

: Inspect a list.

```
:: list 'a : 'A -> 'B
iff bt :: [ 'a : list 'a : 'A -> 'B]
bf :: [ 'A -> 'B]
> IF_CONS bt bf / { a ; <rest> } : S => bt / a : { <rest> } : S
> IF_CONS bt bf / {} : S => bf / S
```

`MAP body`

: Apply the body expression to each element of the list. The body sequence has access to the stack.

```
:: (list 'elt) : 'A -> (list 'b) : 'A
iff body :: [ 'elt : 'A -> 'b : 'A ]
> MAP body / {} : S => {} : S
> MAP body / { a ; <rest> } : S => { b ; <rest'> } : S''
where body / a : S => b : S'
and MAP body / { <rest> } : S' => { <rest'> } : S''
```

`SIZE`

: Get the number of elements in the list.

```
:: list 'elt : 'S -> nat : 'S
> SIZE / { _ ; <rest> } : S => 1 + s : S
where SIZE / { <rest> } : S => s : S
> SIZE / {} : S => 0 : S
```

`ITER body`

: Apply the body expression to each element of a list. The body sequence has access to the stack.

```
:: (list 'elt) : 'A -> 'A
iff body :: [ 'elt : 'A -> 'A ]
> ITER body / {} : S => S
> ITER body / { a ; <rest> } : S => ITER body / { <rest> } : S'
iff body / a : S => S'
```

## Domain specific data types¶

`timestamp`

: Dates in the real world.`mutez`

: A specific type for manipulating tokens.`address`

: An untyped address (implicit account or smart contract).`contract 'param`

: A contract, with the type of its code,`contract unit`

for implicit accounts.`operation`

: An internal operation emitted by a contract.`key`

: A public cryptographic key.`key_hash`

: The hash of a public cryptographic key.`signature`

: A cryptographic signature.`chain_id`

: An identifier for a chain, used to distinguish the test and the main chains.`bls12_381_g1`

,`bls12_381_g2`

: Points on the BLS12-381 curves G_{1}and G_{2}, respectively.`bls12_381_fr`

: An element of the scalar field F_{r}, used for scalar multiplication on the BLS12-381 curves G_{1}and G_{2}.`sapling_transaction ms`

: A Sapling transaction`sapling_state ms`

: A Sapling state`ticket (t)`

: A ticket used to authenticate information of type`(t)`

on-chain.`chest`

: a timelocked chest containing bytes and information to open it. see Timelock .`chest_key`

: used to open a chest, also contains a proof to check the correctness of the opening. see Timelock .`tx_rollup_l2_address`

: An address used to identify an account in a transaction rollup ledger. It is the hash of a BLS public key, used to authenticate layer-2 operations to transfer tickets from this account.

## Domain specific operations¶

### Operations on timestamps¶

Timestamps can be obtained by the `NOW`

operation, or retrieved from
script parameters or globals.

`ADD`

Increment / decrement a timestamp of the given number of seconds.

```
:: timestamp : int : 'S -> timestamp : 'S
:: int : timestamp : 'S -> timestamp : 'S
> ADD / seconds : nat (t) : S => (seconds + t) : S
> ADD / nat (t) : seconds : S => (t + seconds) : S
```

`SUB`

Subtract a number of seconds from a timestamp.

```
:: timestamp : int : 'S -> timestamp : 'S
> SUB / seconds : nat (t) : S => (seconds - t) : S
```

`SUB`

Subtract two timestamps.

```
:: timestamp : timestamp : 'S -> int : 'S
> SUB / seconds(t1) : seconds(t2) : S => (t1 - t2) : S
```

`COMPARE`

: Timestamp comparison.

```
:: timestamp : timestamp : 'S -> int : 'S
> COMPARE / seconds(t1) : seconds(t2) : S => -1 : S
iff t1 < t2
> COMPARE / seconds(t1) : seconds(t2) : S => 0 : S
iff t1 = t2
> COMPARE / seconds(t1) : seconds(t2) : S => 1 : S
iff t1 > t2
```

### Operations on Mutez¶

Mutez (micro-Tez) are internally represented by a 64 bit signed integers. There are restrictions to prevent creating a negative amount of mutez. Operations are limited to prevent overflow and mixing them with other numerical types by mistake. They are also mandatory checked for under/overflows.

`ADD`

```
:: mutez : mutez : 'S -> mutez : 'S
> ADD / x : y : S => [FAILED] on overflow
> ADD / x : y : S => (x + y) : S
```

`SUB_MUTEZ`

```
:: mutez : mutez : 'S -> option mutez : 'S
> SUB_MUTEZ / x : y : S => None
iff x < y
> SUB_MUTEZ / x : y : S => Some (x - y) : S
```

`MUL`

```
:: mutez : nat : 'S -> mutez : 'S
:: nat : mutez : 'S -> mutez : 'S
> MUL / x : y : S => [FAILED] on overflow
> MUL / x : y : S => (x * y) : S
```

`EDIV`

```
:: mutez : nat : 'S -> option (pair mutez mutez) : 'S
:: mutez : mutez : 'S -> option (pair nat mutez) : 'S
> EDIV / x : 0 : S => None
> EDIV / x : y : S => Some (Pair (x / y) (x % y)) : S
iff y <> 0
```

`COMPARE`

: Mutez comparison

```
:: mutez : mutez : 'S -> int : 'S
> COMPARE / x : y : S => -1 : S
iff x < y
> COMPARE / x : y : S => 0 : S
iff x = y
> COMPARE / x : y : S => 1 : S
iff x > y
```

### Operations on contracts¶

`CREATE_CONTRACT { storage 'g ; parameter 'p ; code ... }`

: Forge a new contract from a literal.

```
:: option key_hash : mutez : 'g : 'S
-> operation : address : 'S
```

Originate a contract based on a literal. The parameters are the
optional delegate, the initial amount taken from the current
contract, and the initial storage of the originated contract.
The contract is returned as a first class value (to be dropped, passed
as parameter or stored). The `CONTRACT 'p`

instruction will fail
until it is actually originated. Note that since `tz4`

addresses
cannot be registered as delegates, the origination operation will fail
if the delegate is a `tz4`

.

`TRANSFER_TOKENS`

: Forge a transaction.

```
:: 'p : mutez : contract 'p : 'S -> operation : 'S
```

The parameter must be consistent with the one expected by the contract, unit for an account.

`SET_DELEGATE`

: Set or withdraw the contract’s delegation.

```
:: option key_hash : 'S -> operation : 'S
```

Using this instruction is the only way to modify the delegation of a
smart contract. If the parameter is `None`

then the delegation of the
current contract is withdrawn; if it is `Some kh`

where `kh`

is the
key hash of a registered delegate that is not the current delegate of
the contract, then this operation sets the delegate of the contract to
this registered delegate. The operation fails if `kh`

is the current
delegate of the contract or if `kh`

is not a registered delegate.
Note that `tz4`

addresses cannot be registered as delegates.

`BALANCE`

: Push the current amount of mutez held by the executing contract, including any mutez added by the calling transaction.

```
:: 'S -> mutez : 'S
```

`ADDRESS`

: Cast the contract to its address.

```
:: contract _ : 'S -> address : 'S
> ADDRESS / addr : S => addr : S
```

`CONTRACT 'p`

: Cast the address to the given contract type if possible.

```
:: address : 'S -> option (contract 'p) : 'S
> CONTRACT / addr : S => Some addr : S
iff addr exists and is a contract of parameter type 'p
> CONTRACT / addr : S => Some addr : S
iff 'p = unit and addr is an implicit contract
> CONTRACT / addr : S => None : S
otherwise
```

`SOURCE`

: Push the contract that initiated the current transaction, i.e. the contract that paid the fees and storage cost, and whose manager signed the operation that was sent on the blockchain. Note that since`TRANSFER_TOKENS`

instructions can be chained,`SOURCE`

and`SENDER`

are not necessarily the same.

```
:: 'S -> address : 'S
```

`SENDER`

: Push the contract that initiated the current internal transaction. It may be the`SOURCE`

, but may also be different if the source sent an order to an intermediate smart contract, which then called the current contract.

```
:: 'S -> address : 'S
```

`SELF`

: Push the current contract.

```
:: 'S -> contract 'p : 'S
where contract 'p is the type of the current contract
```

Note that `SELF`

is forbidden in lambdas because it cannot be
type-checked; the type of the contract executing the lambda cannot be
known at the point of type-checking the lambda’s body.

`SELF_ADDRESS`

: Push the address of the current contract. This is equivalent to`SELF; ADDRESS`

except that it is allowed in lambdas.

```
:: 'S -> address : 'S
```

Note that `SELF_ADDRESS`

inside a lambda returns the address of the
contract executing the lambda, which can be different from the address
of the contract in which the `SELF_ADDRESS`

instruction is written.

`AMOUNT`

: Push the amount of the current transaction.

```
:: 'S -> mutez : 'S
```

`IMPLICIT_ACCOUNT`

: Return a default contract with the given public/private key pair. Any funds deposited in this contract can immediately be spent by the holder of the private key. This contract cannot execute Michelson code and will always exist on the blockchain.

```
:: key_hash : 'S -> contract unit : 'S
```

`VOTING_POWER`

: Return the voting power of a given contract. Thisvoting power coincides with the weight of the contract in the voting listings, which is calculated at the beginning of every voting period. Currently the voting power is proportional to the full staking balance of the contract, but this might change in future version of the protocol and developers should not rely on this. Hence, the value returned by

`VOTING_POWER`

should only be considered relative to the one returned by`TOTAL_VOTING_POWER`

.

```
:: key_hash : 'S -> nat : 'S
```

### Special operations¶

`NOW`

: Push the minimal injection time for the current block, namely the block whose validation triggered this execution. The minimal injection time is 60 seconds after the timestamp of the predecessor block. This value does not change during the execution of the contract.

```
:: 'S -> timestamp : 'S
```

`CHAIN_ID`

: Push the chain identifier.

```
:: 'S -> chain_id : 'S
```

`COMPARE`

: Chain identifier comparison

```
:: chain_id : chain_id : 'S -> int : 'S
> COMPARE / x : y : S => -1 : S
iff x < y
> COMPARE / x : y : S => 0 : S
iff x = y
> COMPARE / x : y : S => 1 : S
iff x > y
```

`LEVEL`

: Push the level of the current transaction’s block.

```
:: 'S -> nat : 'S
```

`TOTAL_VOTING_POWER`

: Return the total voting power of all contracts. The total voting power coincides with the sum of the voting power of every contract in the voting listings (as returned by`VOTING_POWER`

). The voting listings is calculated at the beginning of every voting period.

```
:: 'S -> nat : 'S
```

`MIN_BLOCK_TIME`

: Push the current minimal block time in seconds.

```
:: 'S -> nat : 'S
```

### Operations on bytes¶

Bytes are used for serializing data, in order to check signatures and compute hashes on them. They can also be used to incorporate data from the wild and untyped outside world.

`PACK`

: Serializes a piece of data to its optimized binary representation.

```
:: 'a : 'S -> bytes : 'S
```

`UNPACK 'a`

: Deserializes a piece of data, if valid.

```
:: bytes : 'S -> option 'a : 'S
```

`CONCAT`

: Byte sequence concatenation.

```
:: bytes : bytes : 'S -> bytes : 'S
> CONCAT / s : t : S => (s ^ t) : S
:: bytes list : 'S -> bytes : 'S
> CONCAT / {} : S => 0x : S
> CONCAT / { s ; <ss> } : S => (s ^ r) : S
where CONCAT / { <ss> } : S => r : S
```

`SIZE`

: size of a sequence of bytes.

```
:: bytes : 'S -> nat : 'S
```

`SLICE`

: Bytes access.

```
:: nat : nat : bytes : 'S -> option bytes : 'S
> SLICE / offset : length : s : S => Some ss : S
where ss is the substring of s at the given offset and of the given length
iff offset and (offset + length) are in bounds
> SLICE / offset : length : s : S => None : S
iff offset or (offset + length) are out of bounds
```

`COMPARE`

: Lexicographic comparison.

```
:: bytes : bytes : 'S -> int : 'S
> COMPARE / s : t : S => -1 : S
iff s < t
> COMPARE / s : t : S => 0 : S
iff s = t
> COMPARE / s : t : S => 1 : S
iff s > t
```

Bitwise logical operators are also available on bytes.

`OR`

```
:: bytes : bytes : 'S -> bytes : 'S
> OR / x : y : S => (x | y) : S
```

`AND`

```
:: bytes : bytes : 'S -> bytes : 'S
> AND / x : y : S => (x & y) : S
```

`XOR`

```
:: bytes : bytes : 'S -> bytes : 'S
> XOR / x : y : S => (x ^ y) : S
```

`NOT`

```
:: bytes : 'S -> bytes : 'S
> NOT / x : S => ~x : S
```

Logical shifts are also available on bytes.

`LSL`

```
:: bytes : nat : 'S -> bytes : 'S
> LSL / x : s : S => (x << s) : S
iff s <= 64000
> LSL / x : s : S => [FAILED]
iff s > 64000
```

`LSR`

```
:: bytes : nat : 'S -> bytes : 'S
> LSR / x : s : S => (x >> s) : S
iff s <= 256
> LSR / x : s : S => [FAILED]
iff s > 256
```

Bytes can be converted to natural numbers and integers.

`NAT`

: Convert`bytes`

to type`nat`

using big-endian encoding. The`bytes`

are allowed to have leading zeros.

```
:: bytes : 'S -> nat : 'S
> NAT / s : S => n : S
iff s is a big-endian encoding of natural number n
```

`INT`

: Convert`bytes`

to type`int`

using big-endian two’s complement encoding. The`bytes`

are allowed to have leading zeros for non-negative numbers and leading ones for negative numbers.

```
:: bytes : 'S -> int : 'S
> INT / s : S => z : S
iff s is a big-endian encoding of integer z
```

`BYTES`

: Convert a`nat`

or an`int`

to type`bytes`

using big-endian encoding (and two’s complement for`int`

).

```
:: int : 'S -> bytes : 'S
:: nat : 'S -> bytes : 'S
> BYTES / n : S => s : S
iff s is the shortest big-endian encoding of natural number or integer n
```

### Cryptographic primitives¶

`HASH_KEY`

: Compute the b58check of a public key.

```
:: key : 'S -> key_hash : 'S
```

`BLAKE2B`

: Compute a cryptographic hash of the value contents using the Blake2b-256 cryptographic hash function.

```
:: bytes : 'S -> bytes : 'S
```

`KECCAK`

: Compute a cryptographic hash of the value contents using the Keccak-256 cryptographic hash function.

```
:: bytes : 'S -> bytes : 'S
```

`SHA256`

: Compute a cryptographic hash of the value contents using the Sha256 cryptographic hash function.

```
:: bytes : 'S -> bytes : 'S
```

`SHA512`

: Compute a cryptographic hash of the value contents using the Sha512 cryptographic hash function.

```
:: bytes : 'S -> bytes : 'S
```

`SHA3`

: Compute a cryptographic hash of the value contents using the SHA3-256 cryptographic hash function.

```
:: bytes : 'S -> bytes : 'S
```

`CHECK_SIGNATURE`

: Check that a sequence of bytes has been signed with a given key.

```
:: key : signature : bytes : 'S -> bool : 'S
```

`COMPARE`

: Key hash, key and signature comparison

```
:: key_hash : key_hash : 'S -> int : 'S
:: key : key : 'S -> int : 'S
:: signature : signature : 'S -> int : 'S
> COMPARE / x : y : S => -1 : S
iff x < y
> COMPARE / x : y : S => 0 : S
iff x = y
> COMPARE / x : y : S => 1 : S
iff x > y
```

### BLS12-381 primitives¶

`NEG`

: Negate a curve point or field element.

```
:: bls12_381_g1 : 'S -> bls12_381_g1 : 'S
:: bls12_381_g2 : 'S -> bls12_381_g2 : 'S
:: bls12_381_fr : 'S -> bls12_381_fr : 'S
```

`ADD`

: Add two curve points or field elements.

```
:: bls12_381_g1 : bls12_381_g1 : 'S -> bls12_381_g1 : 'S
:: bls12_381_g2 : bls12_381_g2 : 'S -> bls12_381_g2 : 'S
:: bls12_381_fr : bls12_381_fr : 'S -> bls12_381_fr : 'S
```

`MUL`

: Multiply a curve point or field element by a scalar field element. Fr elements can be built from naturals by multiplying by the unit of Fr using`PUSH bls12_381_fr 1; MUL`

. Note that the multiplication will be computed using the natural modulo the order of Fr.

```
:: bls12_381_g1 : bls12_381_fr : 'S -> bls12_381_g1 : 'S
:: bls12_381_g2 : bls12_381_fr : 'S -> bls12_381_g2 : 'S
:: bls12_381_fr : bls12_381_fr : 'S -> bls12_381_fr : 'S
:: nat : bls12_381_fr : 'S -> bls12_381_fr : 'S
:: int : bls12_381_fr : 'S -> bls12_381_fr : 'S
:: bls12_381_fr : nat : 'S -> bls12_381_fr : 'S
:: bls12_381_fr : int : 'S -> bls12_381_fr : 'S
```

`INT`

: Convert a field element to type`int`

. The returned value is always between`0`

(inclusive) and the order of Fr (exclusive).

```
:: bls12_381_fr : 'S -> int : 'S
```

`PAIRING_CHECK`

: Verify that the product of pairings of the given list of points is equal to 1 in Fq12. Returns`true`

if the list is empty. Can be used to verify if two pairings P1 and P2 are equal by verifying P1 * P2^(-1) = 1.

```
:: list (pair bls12_381_g1 bls12_381_g2) : 'S -> bool : 'S
```

### Sapling operations¶

Please see the Sapling integration page for a more comprehensive description of the Sapling protocol.

`SAPLING_VERIFY_UPDATE`

: verify and apply a transaction on a Sapling state.

```
:: sapling_transaction ms : sapling_state ms : 'S -> option (pair bytes (pair int (sapling_state ms))): 'S
> SAPLING_VERIFY_UPDATE / t : s : S => Some (Pair bound_data (Pair balance s')) : S
iff the transaction t successfully applied on state s resulting
in the bound_data and the balance of the transaction and an updated state s'
> SAPLING_VERIFY_UPDATE / t : s : S => None : S
iff the transaction t is invalid with respect to the state
```

`SAPLING_EMPTY_STATE ms`

: Pushes an empty state on the stack.:: 'S -> sapling_state ms: 'S > SAPLING_EMPTY_STATE ms / S => sapling_state ms : S with `sapling_state ms` being the empty state (ie. no one can spend tokens from it) with memo_size `ms`

### Operations on tickets¶

The following operations deal with tickets. Tickets are a way for smart-contracts to authenticate data with respect to a Tezos address. This authentication can then be used to build composable permission systems. For a high-level explanation of tickets in Tezos, see :doc: Tickets <tickets>.

A contract can create a ticket from a value and an amount. The ticket, when inspected reveals the value, the amount, and the address of the ticketer (the contract that created the ticket). It is impossible for a contract to “forge” a ticket that appears to have been created by another ticketer.

The amount is a meta-data that can be used to implement UTXOs.

Tickets cannot be duplicated using the `DUP`

instruction.

For example, a ticket could represent a Non Fungible Token (NFT) or a Unspent Transaction Output (UTXO) which can then be passed around and behave like a value. This process can happen without the need to interact with a centralized NFT contract, simplifying the code.

`TICKET`

: Create a ticket with the given content and amount. The ticketer is the address of SELF. The resulting value is`NONE`

if the amount is zero.

```
:: 'a : nat : 'S -> option ticket 'a : 'S
```

Type `'a`

must be comparable (the `COMPARE`

primitive must be defined over it).

`READ_TICKET`

: Retrieve the information stored in a ticket. Also return the ticket.

```
:: ticket 'a : 'S -> pair address 'a nat : ticket 'a : 'S
```

`SPLIT_TICKET`

: Delete the given ticket and create two tickets with the same content and ticketer as the original, but with the new provided amounts. (This can be used to easily implement UTXOs.) Return None iff the ticket’s original amount is not equal to the sum of the provided amounts, or one of the provided amounts is zero.

```
:: ticket 'a : (pair nat nat) : 'S ->
option (pair (ticket 'a) (ticket 'a)) : 'S
```

`JOIN_TICKETS`

: The inverse of`SPLIT_TICKET`

. Delete the given tickets and create a ticket with an amount equal to the sum of the amounts of the input tickets. (This can be used to consolidate UTXOs.) Return None iff the input tickets have a different ticketer or content.

```
:: (pair (ticket 'a) (ticket 'a)) : 'S ->
option (ticket 'a) : 'S
```

### Operations on timelock¶

`OPEN_CHEST`

: opens a timelocked chest given its key and the time. The results can be bytes if the opening is correct, or a boolean indicating whether the chest was incorrect, or its opening was. See Timelock for more information.

```
:: chest_key : chest : nat : 'S -> or bytes bool : 'S
```

### Events¶

`EMIT %tag 'ty`

: constructs an operation that will write an event into the transaction receipt after the successful execution of this contract. It accepts as arguments an annotation as a tag to the emitted event and the type of data attachment.See Event for more information.

```
:: 'ty : 'S -> operation : 'S
```

### Removed instructions¶

Protocol Babylon deprecated the following instructions. Because no smart contract used these on Mainnet before they got deprecated, they have been removed. The Michelson type-checker will reject any contract using them.

`CREATE_CONTRACT { storage 'g ; parameter 'p ; code ... }`

: Forge a new contract from a literal.

```
:: key_hash : option key_hash : bool : bool : mutez : 'g : 'S
-> operation : address : 'S
```

See the documentation of the new `CREATE_CONTRACT`

instruction. The
first, third, and fourth parameters are ignored.

`CREATE_ACCOUNT`

: Forge an account creation operation.

```
:: key_hash : option key_hash : bool : mutez : 'S
-> operation : address : 'S
```

Takes as argument the manager, optional delegate, the delegatable flag
and finally the initial amount taken from the currently executed
contract. This instruction originates a contract with two entrypoints;
`%default`

of type `unit`

that does nothing and `%do`

of type
`lambda unit (list operation)`

that executes and returns the
parameter if the sender is the contract’s manager.

`STEPS_TO_QUOTA`

: Push the remaining steps before the contract execution must terminate.

```
:: 'S -> nat : 'S
```

### Operations on views¶

Views are a mechanism for contract calls that:

are read-only: they may depend on the storage of the contract declaring the view but cannot modify it nor emit operations (but they can call other views),

take arguments as input in addition to the contract storage,

return results as output,

are synchronous: the result is immediately available on the stack of the caller contract.

In other words, the execution of a view is included in the operation of caller’s contract, but accesses the storage of the declarer’s contract, in read-only mode. Thus, in terms of execution, views are more like lambda functions rather than contract entrypoints, Here is an example:

```
code {
...;
TRANSFER_TOKENS;
...;
VIEW "view_ex" unit;
...;
};
```

This contract calls a contract `TRANSFER_TOKENS`

, and, later on, a view called “view_ex”.
No matter if the callee “view_ex” is defined in the same contract with this caller contract or not,
this view will be executed immediately in the current operation,
while the operations emitted by `TRANSFER_TOKENS`

will be executed later on.
As a result, although it may seem that “view_ex” receives the storage modified by `TRANSFER_TOKENS`

,
this is not the case.
In other words, the storage of the view is the same as when the current contract was called.
In particular, in case of re-entrance, i.e., if a contract A calls a contract B that calls a view on A, the storage of the view will be the same as when B started, not when A started.

Views are **declared** at the toplevel of the script of the contract on which they operate,
alongside the contract parameter type, storage type, and code.
To declare a view, the `view`

keyword is used; its syntax is
`view name 'arg 'return { instr; ... }`

where:

`name`

is a string of at most 31 characters matching the regular expression`[a-zA-Z0-9_.%@]*`

; it is used to identify the view, hence it must be different from the names of the other views declared in the same script;`'arg`

is the type of the argument of the view;`'return`

is the type of the result returned by the view;`{ instr; ... }`

is a sequence of instructions of type`lambda (pair 'arg 'storage_ty) 'return`

where`'storage_ty`

is the type of the storage of the current contract. Certain specific instructions have different semantics in`view`

:`BALANCE`

represents the current amount of mutez held by the contract where`view`

is;`SENDER`

represents the contract which is the caller of`view`

;`SELF_ADDRESS`

represents the contract where`view`

is;`AMOUNT`

is always 0 mutez.

Note that in both view input (type `'arg`

) and view output (type `'return`

), the following types are forbidden: `ticket`

, `operation`

, `big_map`

and `sapling_state`

.

Views are **called** using the following Michelson instruction:

`VIEW name 'return`

: Call the view named`name`

from the contract whose address is the second element of the stack, sending it as input the top element of the stack.

```
:: 'arg : address : 'S -> option 'return : 'S
> VIEW name 'return / x : addr : S => Some y : S
iff addr is the address of a smart contract c with storage s
where c has a toplevel declaration of the form "view name 'arg 'return { code }"
and code / Pair x s : [] => y : []
> VIEW name 'return / _ : _ : S => None : S
otherwise
```

If the given address is nonexistent or if the contract at that address does not have a view of the expected name and type,
`None`

will be returned.
Otherwise, `Some a`

will be returned where `a`

is the result of the view call.
Note that if a contract address containing an entrypoint `address%entrypoint`

is provided,
only the `address`

part will be taken.
`operation`

, `big_map`

and `sapling_state`

and `ticket`

types are forbidden for the `'return`

type.

Here is an example using views, consisting of two contracts.
The first contract defines two views at toplevel that are named `add_v`

and `mul_v`

.

```
{ parameter nat;
storage nat;
code { CAR; NIL operation ; PAIR };
view "add_v" nat nat { UNPAIR; ADD };
view "mul_v" nat nat { UNPAIR; MUL };
}
```

The second contract calls the `add_v`

view of the above contract and obtains a result immediately.

```
{ parameter (pair nat address) ;
storage nat ;
code { CAR ; UNPAIR; VIEW "add_v" nat ;
IF_SOME { } { FAIL }; NIL operation; PAIR }; }
```

## Macros¶

In addition to the operations above, several extensions have been added to the language’s concrete syntax. If you are interacting with the node via RPC, bypassing the client, which expands away these macros, you will need to desugar them yourself.

These macros are designed to be unambiguous and reversible, meaning that errors are reported in terms of desugared syntax. Below you’ll see these macros defined in terms of other syntactic forms. That is how these macros are seen by the node.

### Compare¶

Syntactic sugar exists for merging `COMPARE`

and comparison
combinators, and also for branching.

`CMP{EQ|NEQ|LT|GT|LE|GE}`

```
> CMP(\op) / S => COMPARE ; (\op) / S
```

`IF{EQ|NEQ|LT|GT|LE|GE} bt bf`

```
> IF(\op) bt bf / S => (\op) ; IF bt bf / S
```

`IFCMP{EQ|NEQ|LT|GT|LE|GE} bt bf`

```
> IFCMP(\op) / S => COMPARE ; (\op) ; IF bt bf / S
```

### Fail¶

The `FAIL`

macros is equivalent to `UNIT; FAILWITH`

and is callable
in any context since it does not use its input stack.

`FAIL`

```
> FAIL / S => UNIT; FAILWITH / S
```

### Assertion macros¶

All assertion operations are syntactic sugar for conditionals with a
`FAIL`

instruction in the appropriate branch. When possible, use them
to increase clarity about illegal states.

`ASSERT`

```
> ASSERT => IF {} {FAIL}
```

`ASSERT_{EQ|NEQ|LT|LE|GT|GE}`

```
> ASSERT_(\op) => IF(\op) {} {FAIL}
```

`ASSERT_CMP{EQ|NEQ|LT|LE|GT|GE}`

```
> ASSERT_CMP(\op) => IFCMP(\op) {} {FAIL}
```

`ASSERT_NONE`

```
> ASSERT_NONE => IF_NONE {} {FAIL}
```

`ASSERT_SOME`

```
> ASSERT_SOME @x => IF_NONE {FAIL} {RENAME @x}
```

`ASSERT_LEFT`

```
> ASSERT_LEFT @x => IF_LEFT {RENAME @x} {FAIL}
```

`ASSERT_RIGHT`

```
> ASSERT_RIGHT @x => IF_LEFT {FAIL} {RENAME @x}
```

### Syntactic Conveniences¶

These macros are simply more convenient syntax for various common operations.

`P(\left=A|P(\left)(\right))(\right=I|P(\left)(\right))R`

: A syntactic sugar for building nested pairs. In the case of right combs, PAIR n is more efficient.

```
> PA(\right)R / S => DIP ((\right)R) ; PAIR / S
> P(\left)IR / S => (\left)R ; PAIR / S
> P(\left)(\right)R => (\left)R ; DIP ((\right)R) ; PAIR / S
```

A good way to quickly figure which macro to use is to mentally parse the
macro as `P`

for pair constructor, `A`

for left leaf and `I`

for
right leaf. The macro takes as many elements on the stack as there are
leaves and constructs a nested pair with the shape given by its name.

Take the macro `PAPPAIIR`

for instance:

```
P A P P A I I R
( l, ( ( l, r ), r ))
```

A typing rule can be inferred:

```
PAPPAIIR
:: 'a : 'b : 'c : 'd : 'S -> (pair 'a (pair (pair 'b 'c) 'd))
```

`UNP(\left=A|P(\left)(\right))(\right=I|P(\left)(\right))R`

: A syntactic sugar for destructing nested pairs. These macros follow the same convention as the previous one.

```
> UNPA(\right)R / S => UNPAIR ; DIP (UN(\right)R) / S
> UNP(\left)IR / S => UNPAIR ; UN(\left)R / S
> UNP(\left)(\right)R => UNPAIR ; DIP (UN(\right)R) ; UN(\left)R / S
```

`C[AD]+R`

: A syntactic sugar for accessing fields in nested pairs. In the case of right combs,`CAR k`

and`CDR k`

are more efficient.

```
> CA(\rest=[AD]+)R / S => CAR ; C(\rest)R / S
> CD(\rest=[AD]+)R / S => CDR ; C(\rest)R / S
```

`CAR k`

: Access the`k`

-th part of a right comb of size`n > k + 1`

.`CAR 0`

is equivalent to`CAR`

and in general`CAR k`

is equivalent to`k`

times the`CDR`

instruction followed by once the`CAR`

instruction. Note that this instruction cannot access the last element of a right comb;`CDR k`

should be used for that.

```
> CAR n / S => GET (2n+1) / S
```

`CDR k`

: Access the rightmost element of a right comb of size`k`

.`CDR 0`

is a no-op,`CDR 1`

is equivalent to`CDR`

and in general`CDR k`

is equivalent to`k`

times the`CDR`

instruction. Note that on a right comb of size`n > k >= 2`

,`CDR k`

will return the right comb composed of the same elements but the`k`

leftmost ones.

```
> CDR n / S => GET (2n) / S
```

`IF_SOME bt bf`

: Inspect an optional value.

```
> IF_SOME bt bf / S => IF_NONE bf bt / S
```

`IF_RIGHT bt bf`

: Inspect a value of a union.

```
> IF_RIGHT bt bf / S => IF_LEFT bf bt / S
```

`SET_CAR`

: Set the left field of a pair. This is equivalent to`SWAP; UPDATE 1`

.

```
> SET_CAR => CDR ; SWAP ; PAIR
```

`SET_CDR`

: Set the right field of a pair. This is equivalent to`SWAP; UPDATE 2`

.

```
> SET_CDR => CAR ; PAIR
```

`SET_C[AD]+R`

: A syntactic sugar for setting fields in nested pairs. In the case of right combs, UPDATE n is more efficient.

```
> SET_CA(\rest=[AD]+)R / S =>
{ DUP ; DIP { CAR ; SET_C(\rest)R } ; CDR ; SWAP ; PAIR } / S
> SET_CD(\rest=[AD]+)R / S =>
{ DUP ; DIP { CDR ; SET_C(\rest)R } ; CAR ; PAIR } / S
```

`MAP_CAR`

code: Transform the left field of a pair.

```
> MAP_CAR code => DUP ; CDR ; DIP { CAR ; code } ; SWAP ; PAIR
```

`MAP_CDR`

code: Transform the right field of a pair.

```
> MAP_CDR code => DUP ; CDR ; code ; SWAP ; CAR ; PAIR
```

`MAP_C[AD]+R`

code: A syntactic sugar for transforming fields in nested pairs.

```
> MAP_CA(\rest=[AD]+)R code / S =>
{ DUP ; DIP { CAR ; MAP_C(\rest)R code } ; CDR ; SWAP ; PAIR } / S
> MAP_CD(\rest=[AD]+)R code / S =>
{ DUP ; DIP { CDR ; MAP_C(\rest)R code } ; CAR ; PAIR } / S
```

## Concrete syntax¶

The concrete language is very close to the formal notation of the specification. Its structure is extremely simple: an expression in the language can only be one of the five following constructs.

An integer in decimal notation.

A character string.

A byte sequence in hexadecimal notation prefixed by

`0x`

.The application of a primitive to a sequence of expressions.

A sequence of expressions.

This simple five cases notation is called Micheline.

In the Tezos protocol, the primitive `constant`

with a single
character string applied has special meaning. See
Global Constants.

### Constants¶

There are three kinds of constants:

Integers or naturals in decimal notation.

Strings, with some usual escape sequences:

`\n`

,`\\`

,`\"`

. Unescaped line-breaks (both`\n`

and`\r`

) cannot appear in a Michelson string. Moreover, the current version of Michelson restricts strings to be the printable subset of 7-bit ASCII, namely characters with codes from within [32, 126] range, plus the escaped characters mentioned above.Byte sequences in hexadecimal notation, prefixed with

`0x`

.

### Differences with the formal notation¶

The concrete syntax follows the same lexical conventions as the specification: instructions are represented by uppercase identifiers, type constructors by lowercase identifiers, and constant constructors are capitalized.

All domain specific constants are Micheline constants with specific formats. Some have two variants accepted by the data type checker: a readable one in a string, and an optimized one using a more compact encoding.

`mutez`

amounts are written as naturals.`timestamp`

s are written either using`RFC3339`

notation in a string (readable), or as the number of seconds since Epoch (when positive) or before Epoch (when negative) (optimized).`contract`

s,`address`

es,`key`

s and`signature`

s are written as strings, in their usual Base58 encoded versions (readable), or as their raw bytes (optimized).`bls12_381_g1`

s and`bls12_381_g2`

s are written as their raw bytes, using a big-endian point encoding, as specified here.`bls12_381_fr`

s are written as their raw bytes, using a little-endian encoding.

The optimized versions should not reach the RPCs, the protocol code will convert to optimized by itself when forging operations, storing to the database, and before hashing to get a canonical representation of a datum for a given type.

To prevent errors, control flow primitives that take instructions as parameters require sequences in the concrete syntax.

```
IF { instr1_true ; instr2_true ; ... }
{ instr1_false ; instr2_false ; ... }
```

### Main program structure¶

The toplevel of a smart contract file must be an un-delimited sequence
of three primitive applications (in no particular order) that provide its
`code`

, `parameter`

and `storage`

fields.

See the next section for a concrete example.

## Annotations¶

The annotation mechanism of Michelson provides ways to better track
data on the stack and to give additional type constraints. Except for
a single exception specified just after, annotations are only here to
add constraints, *i.e.* they cannot turn an otherwise rejected program
into an accepted one. The notable exception to this rule is for
entrypoints: the semantics of the CONTRACT and SELF instructions vary depending on
their constructor annotations, and some contract origination may fail due
to invalid entrypoint constructor annotations.

Stack visualization tools like the Michelson’s Emacs mode print annotations associated with each type in the program, as propagated by the typechecker as well as variable annotations on the types of elements in the stack. This is useful as a debugging aid.

We distinguish three kinds of annotations:

type annotations, written

`:type_annot`

,variable annotations, written

`@var_annot`

,and field or constructors annotations, written

`%field_annot`

.

### Type annotations¶

Each type can be annotated with at most one type annotation. They are used to give names to types. For types to be equal, their unnamed version must be equal and their names must be the same or at least one type must be unnamed.

For instance, the following Michelson program which put its integer parameter in the storage is not well typed:

```
parameter (int :p) ;
storage (int :s) ;
code { UNPAIR ; SWAP ; DROP ; NIL operation ; PAIR }
```

Whereas this one is:

```
parameter (int :p) ;
storage int ;
code { UNPAIR ; SWAP ; DROP ; NIL operation ; PAIR }
```

Inner components of composed typed can also be named.

```
(pair :point (int :x_pos) (int :y_pos))
```

Push-like instructions, that act as constructors, can also be given a type annotation. The stack type will then have on top a type with a corresponding name.

```
UNIT :t
:: 'A -> (unit :t) : 'A
PAIR :t
:: 'a : 'b : 'S -> (pair :t 'a 'b) : 'S
SOME :t
:: 'a : 'S -> (option :t 'a) : 'S
NONE :t 'a
:: 'S -> (option :t 'a) : 'S
LEFT :t 'b
:: 'a : 'S -> (or :t 'a 'b) : 'S
RIGHT :t 'a
:: 'b : 'S -> (or :t 'a 'b) : 'S
NIL :t 'a
:: 'S -> (list :t 'a) : 'S
EMPTY_SET :t 'elt
:: 'S -> (set :t 'elt) : 'S
EMPTY_MAP :t 'key 'val
:: 'S -> (map :t 'key 'val) : 'S
EMPTY_BIG_MAP :t 'key 'val
:: 'S -> (big_map :t 'key 'val) : 'S
```

A no-op instruction `CAST`

ensures the top of the stack has the
specified type, and change its type if it is compatible. In particular,
this allows to change or remove type names explicitly.

```
CAST 'b
:: 'a : 'S -> 'b : 'S
iff 'a = 'b
> CAST t / a : S => a : S
```

### Variable annotations¶

Variable annotations can only be used on instructions that produce
elements on the stack. An instruction that produces `n`

elements on
the stack can be given at most `n`

variable annotations.

The stack type contains both the types of each element in the stack, as well as an optional variable annotation for each element. In this sub-section we note:

`[]`

for the empty stack,`@annot (top) : (rest)`

for the stack whose first value has type`(top)`

and is annotated with variable annotation`@annot`

and whose queue has stack type`(rest)`

.

The instructions which do not accept any variable annotations are:

```
DROP
SWAP
DIG
DUG
IF_NONE
IF_LEFT
IF_CONS
ITER
IF
LOOP
LOOP_LEFT
DIP
FAILWITH
```

The instructions which accept at most one variable annotation are:

```
DUP
PUSH
UNIT
SOME
NONE
PAIR
CAR
CDR
LEFT
RIGHT
NIL
CONS
SIZE
MAP
MEM
EMPTY_SET
EMPTY_MAP
EMPTY_BIG_MAP
UPDATE
GET
LAMBDA
LAMBDA_REC
EXEC
ADD
SUB
CONCAT
MUL
OR
AND
XOR
NOT
ABS
ISNAT
INT
NEG
EDIV
LSL
LSR
COMPARE
EQ
NEQ
LT
GT
LE
GE
ADDRESS
CONTRACT
SET_DELEGATE
IMPLICIT_ACCOUNT
NOW
LEVEL
AMOUNT
BALANCE
HASH_KEY
CHECK_SIGNATURE
BLAKE2B
SOURCE
SENDER
SELF
SELF_ADDRESS
CAST
RENAME
CHAIN_ID
NAT
BYTES
```

The instructions which accept at most two variable annotations are:

```
UNPAIR
CREATE_CONTRACT
```

Annotations on instructions that produce multiple elements on the stack
will be used in order, where the first variable annotation is given to
the top-most element on the resulting stack. Instructions that produce
`n`

elements on the stack but are given less than `n`

variable
annotations will see only their top-most stack type elements annotated.

```
UNPAIR @first @second
:: pair 'a 'b : 'S
-> @first 'a : @second 'b : 'S
UNPAIR @first
:: pair 'a 'b : 'S
-> @first 'a : 'b : 'S
```

A no-op instruction `RENAME`

allows to rename variables in the stack
or to erase variable annotations in the stack.

```
RENAME @new
:: @old 'a ; 'S -> @new 'a : 'S
RENAME
:: @old 'a ; 'S -> 'a : 'S
```

### Field and constructor annotations¶

Components of pair types, option types and or types can be annotated with a field or constructor annotation. This feature is useful to encode records fields and constructors of sum types.

```
(pair :point
(int %x)
(int %y))
```

The previous Michelson type can be used as visual aid to represent the record type (given in OCaml-like syntax):

```
type point = { x : int ; y : int }
```

Similarly,

```
(or :t
(int %A)
(or
(bool %B)
(pair %C
(nat %n1)
(nat %n2))))
```

can be used to represent the algebraic data type (in OCaml-like syntax):

```
type t =
| A of int
| B of bool
| C of { n1 : nat ; n2 : nat }
```

Field annotations are part of the type (at the same level as type name annotations), and so types with differing field names (if present) are not considered equal.

Instructions that construct elements of composed types can also be annotated with one or multiple field annotations (in addition to type and variable annotations).

```
PAIR %fst %snd
:: 'a : 'b : 'S -> (pair ('a %fst) ('b %snd)) : 'S
LEFT %left %right 'b
:: 'a : 'S -> (or ('a %left) ('b %right)) : 'S
RIGHT %left %right 'a
:: 'b : 'S -> (or ('a %left) ('b %right)) : 'S
```

To improve readability and robustness, instructions `CAR`

and `CDR`

accept one field annotation. For the contract to type check, the name of
the accessed field in the destructed pair must match the one given here.

```
CAR %fst
:: (pair ('a %fst) 'b) : S -> 'a : 'S
CDR %snd
:: (pair 'a ('b %snd)) : S -> 'b : 'S
```

### Syntax¶

Primitive applications can receive one or many annotations.

An annotation is a sequence of characters that matches the regular
expression `@%|@%%|%@|[@:%][_0-9a-zA-Z][_0-9a-zA-Z\.%@]*`

.
Note however that `@%`

, `@%%`

and `%@`

are
special annotations and are not allowed everywhere.

Annotations come after the primitive name and before its potential arguments.

```
(prim @v :t %x arg1 arg2 ...)
```

Ordering between different kinds of annotations is not significant, but ordering among annotations of the same kind is. Annotations of the same kind must be grouped together.

For instance these two annotated instructions are equivalent:

```
PAIR :t @my_pair %x %y
PAIR %x %y :t @my_pair
```

An annotation can be empty, in this case it will mean *no annotation*
and can be used as a wildcard. For instance, it is useful to annotate
only the right field of a pair instruction `PAIR % %right`

or to
ignore field access constraints, *e.g.* in the macro ```
UNPPAIPAIR %x1 %
%x3 %x4
```

.

### Annotations and macros¶

Macros also support annotations, which are propagated on their expanded
forms. As with instructions, macros that produce `n`

values on the
stack accept `n`

variable annotations.

```
DUU+P @annot
> DUU(\rest=U*)P @annot / S => DIP (DU(\rest)P @annot) ; SWAP / S
C[AD]+R @annot %field_name
> CA(\rest=[AD]+)R @annot %field_name / S => CAR ; C(\rest)R @annot %field_name / S
> CD(\rest=[AD]+)R @annot %field_name / S => CDR ; C(\rest)R @annot %field_name / S
CMP{EQ|NEQ|LT|GT|LE|GE} @annot
> CMP(\op) @annot / S => COMPARE ; (\op) @annot / S
```

The variable annotation on `SET_C[AD]+R`

and `MAP_C[AD]+R`

annotates
the resulting toplevel pair while its field annotation is used to check
that the modified field is the expected one.

```
SET_C[AD]+R @var %field
> SET_CAR @var %field => CDR %field ; SWAP ; PAIR @var
> SET_CDR @var %field => CAR %field ; PAIR @var
> SET_CA(\rest=[AD]+)R @var %field / S =>
{ DUP ; DIP { CAR ; SET_C(\rest)R %field } ; CDR ; SWAP ; PAIR @var } / S
> SET_CD(\rest=[AD]+)R @var %field/ S =>
{ DUP ; DIP { CDR ; SET_C(\rest)R %field } ; CAR ; PAIR @var } / S
MAP_C[AD]+R @var %field code
> MAP_CAR code => DUP ; CDR ; DIP { CAR %field ; code } ; SWAP ; PAIR @var
> MAP_CDR code => DUP ; CDR %field ; code ; SWAP ; CAR ; PAIR @var
> MAP_CA(\rest=[AD]+)R @var %field code / S =>
{ DUP ; DIP { CAR ; MAP_C(\rest)R %field code } ; CDR ; SWAP ; PAIR @var} / S
> MAP_CD(\rest=[AD]+)R @var %field code / S =>
{ DUP ; DIP { CDR ; MAP_C(\rest)R %field code } ; CAR ; PAIR @var} / S
```

Macros for nested `PAIR`

accept multiple annotations. Field
annotations for `PAIR`

give names to leaves of the constructed
nested pair, in order. This next snippet gives examples instead of
generic rewrite rules for readability purposes.

```
PAPPAIIR @p %x1 %x2 %x3 %x4
:: 'a : 'b : 'c : 'd : 'S
-> @p (pair ('a %x1) (pair (pair ('b %x) ('c %x3)) ('d %x4))) : 'S
PAPAIR @p %x1 %x2 %x3
:: 'a : 'b : 'c : 'S -> @p (pair ('a %x1) (pair ('b %x) ('c %x3))) : 'S
```

Annotations for nested `UNPAIR`

are deprecated.

### Automatic variable and field annotations inferring¶

When no annotation is provided by the Michelson programmer, the typechecker infers some annotations in specific cases. This greatly helps users track information in the stack for bare contracts.

For unannotated accesses with `CAR`

and `CDR`

to fields that are
named will be appended (with an additional `.`

character) to the pair
variable annotation.

```
CDAR
:: @p (pair ('a %foo) (pair %bar ('b %x) ('c %y))) : 'S -> @p.bar.x 'b : 'S
```

If fields are not named but the pair is still named in the stack then
`.car`

or `.cdr`

will be appended.

```
CDAR
:: @p (pair 'a (pair 'b 'c)) : 'S -> @p.cdr.car 'b : 'S
```

If the original pair is not named in the stack, but a field annotation is present in the pair type the accessed value will be annotated with a variable annotation corresponding to the field annotation alone.

```
CDAR
:: (pair ('a %foo) (pair %bar ('b %x) ('c %y))) : 'S -> @bar.x 'b : 'S
```

A similar mechanism is used for context dependent instructions:

```
ADDRESS :: @c contract _ : 'S -> @c.address address : 'S
CONTRACT 'p :: @a address : 'S -> @a.contract contract 'p : 'S
BALANCE :: 'S -> @balance mutez : 'S
SOURCE :: 'S -> @source address : 'S
SENDER :: 'S -> @sender address : 'S
SELF :: 'S -> @self contract 'p : 'S
SELF_ADDRESS :: 'S -> @self address : 'S
AMOUNT :: 'S -> @amount mutez : 'S
NOW :: 'S -> @now timestamp : 'S
LEVEL :: 'S -> @level nat : 'S
```

Inside nested code blocks, bound items on the stack will be given a
default variable name annotation depending on the instruction and stack
type (which can be changed). For instance the annotated typing rule for
`ITER`

on lists is:

```
ITER body
:: @l (list 'e) : 'A -> 'A
iff body :: [ @l.elt e' : 'A -> 'A ]
```

### Special annotations¶

The special variable annotations `@%`

and `@%%`

can be used on instructions
`CAR`

, `CDR`

, and `UNPAIR`

. It means to use the accessed field name (if any) as
a name for the value on the stack. The following typing rule
demonstrates their use for instruction `CAR`

.

```
CAR @%
:: @p (pair ('a %fst) ('b %snd)) : 'S -> @fst 'a : 'S
CAR @%%
:: @p (pair ('a %fst) ('b %snd)) : 'S -> @p.fst 'a : 'S
```

The special field annotation `%@`

can be used on instructions
`PAIR`

, `LEFT`

and `RIGHT`

. It means to use the variable
name annotation in the stack as a field name for the constructed
element. Two examples with `PAIR`

follows, notice the special
treatment of annotations with `.`

.

```
PAIR %@ %@
:: @x 'a : @y 'b : 'S -> (pair ('a %x) ('b %y)) : 'S
PAIR %@ %@
:: @p.x 'a : @p.y 'b : 'S -> @p (pair ('a %x) ('b %y)) : 'S
:: @p.x 'a : @q.y 'b : 'S -> (pair ('a %x) ('b %y)) : 'S
```

## Entrypoints¶

The specification up to this point has been mostly ignoring existence of entrypoints: a mechanism of contract level polymorphism. This mechanism is optional, non intrusive, and transparent to smart contracts that don’t use them. This section is to be read as a patch over the rest of the specification, introducing rules that apply only in presence of contracts that make use of entrypoints.

### Defining and calling entrypoints¶

Entrypoints piggyback on the constructor annotations. A contract with
entrypoints is basically a contract that takes a disjunctive type (a
nesting of `or`

types) as the root of its input parameter, decorated
with constructor annotations. An extra check is performed on these
constructor annotations: a contract cannot define two entrypoints with
the same name.

An external transaction can include an entrypoint name alongside the
parameter value. In that case, if there is a constructor annotation
with this name at any position in the nesting of `or`

types, the
value is automatically wrapped into the according constructors. If the
transaction specifies an entrypoint, but there is no such constructor
annotation, the transaction fails.

For instance, suppose the following input type.

`parameter (or (or (nat %A) (bool %B)) (or %maybe_C (unit %Z) (string %C)))`

The input values will be wrapped as in the following examples.

```
+------------+-----------+---------------------------------+
| entrypoint | input | wrapped input |
+------------+-----------+---------------------------------+
| %A | 3 | Left (Left 3) |
| %B | False | Left (Right False) |
| %C | "bob" | Right (Right "bob") |
| %Z | Unit | Right (Left Unit) |
| %maybe_C | Right "x" | Right (Right "x") |
| %maybe_C | Left Unit | Right (Left Unit) |
+------------+-----------+---------------------------------+
| not given | value | value (untouched) |
| %BAD | _ | failure, contract not called |
+------------+-----------+---------------------------------+
```

### The `default`

entrypoint¶

A special semantics is assigned to the `default`

entrypoint. If the
contract does not explicitly declare a `default`

entrypoint, then it
is automatically assigned to the root of the parameter
type. Conversely, if the contract is called without specifying an
entrypoint, then it is assumed to be called with the `default`

entrypoint. This behaviour makes the entrypoint system completely
transparent to contracts that do not use it.

This is the case for the previous example, for instance. If a value is
passed to such a contract specifying entrypoint `default`

, then the
value is fed to the contract untouched, exactly as if no entrypoint
was given.

A non enforced convention is to make the entrypoint `default`

of
type unit, and to implement the crediting operation (just receive the
transferred tokens).

A consequence of this semantics is that if the contract uses the
entrypoint system and defines a `default`

entrypoint somewhere else
than at the root of the parameter type, then it must provide an
entrypoint for all the paths in the toplevel disjunction. Otherwise,
some parts of the contracts would be dead code.

Another consequence of setting the entrypoint somewhere else than at
the root is that it makes it impossible to send the raw values of the
full parameter type to a contract. A trivial solution for that is to
name the root of the type. The conventional name for that is `root`

.

Let us recapitulate this by tweaking the names of the previous example.

`parameter (or %root (or (nat %A) (bool %B)) (or (unit %default) string))`

The input values will be wrapped as in the following examples.

```
+------------+---------------------+-----------------------+
| entrypoint | input | wrapped input |
+------------+---------------------+-----------------------+
| %A | 3 | Left (Left 3) |
| %B | False | Left (Right False) |
| %default | Unit | Right (Left Unit) |
| %root | Right (Right "bob") | Right (Right "bob") |
+------------+---------------------+-----------------------+
| not given | Unit | Right (Left Unit) |
| %BAD | _ | failure, contract not |
+------------+---------------------+-----------------------+
```

### Calling entrypoints from Michelson¶

Michelson code can also produce transactions to a specific entrypoint.

For this, both types `address`

and `contract`

have the ability to
denote not just an address, but a pair of an address and an
entrypoint. The concrete notation is `"address%entrypoint"`

.
Note that `"address"`

is strictly equivalent to `"address%default"`

,
and for clarity, the second variant is forbidden in the concrete syntax.

When the `TRANSFER_TOKENS`

instruction is called, it places the
entrypoint provided in the contract handle in the transaction.

The `CONTRACT t`

instruction has a variant ```
CONTRACT %entrypoint
t
```

, that works as follows. Note that `CONTRACT t`

is strictly
equivalent to `CONTRACT %default t`

, and for clarity, the second
variant is forbidden in the concrete syntax.

```
+---------------+---------------------+------------------------------------------+
| input address | instruction | output contract |
+---------------+---------------------+------------------------------------------+
| "addr" | CONTRACT t | (Some "addr") if contract exists, has a |
| | | default entrypoint of type t, or has no |
| | | default entrypoint and parameter type t |
+---------------+---------------------+------------------------------------------+
| "addr%name" | CONTRACT t | (Some "addr%name") if addr exists and |
+---------------+---------------------+ has an entrypoint %name of type t |
| "addr" | CONTRACT %name t | |
+---------------+---------------------+------------------------------------------+
| "addr%_" | CONTRACT %_ t | None |
+---------------+---------------------+------------------------------------------+
```

Similarly, the `SELF`

instruction has a variant `SELF %entrypoint`

,
that is only well-typed if the current contract has an entrypoint named `%entrypoint`

.

`SELF %entrypoint`

```
:: 'S -> contract 'p : 'S
where contract 'p is the type of the entrypoint %entrypoint of the current contract
```

Implicit accounts are considered to have a single `default`

entrypoint of type `Unit`

.

## JSON syntax¶

Micheline expressions are encoded in JSON like this:

An integer

`N`

is an object with a single field`"int"`

whose value is the decimal representation as a string.`{ "int": "N" }`

A string

`"contents"`

is an object with a single field`"string"`

whose value is the decimal representation as a string.`{ "string": "contents" }`

A sequence is a JSON array.

`[ expr, ... ]`

A primitive application is an object with two fields

`"prim"`

for the primitive name and`"args"`

for the arguments (that must contain an array). A third optional field`"annots"`

contains a list of annotations, including their leading`@`

,`%`

or`:`

sign.`{ "prim": "pair", "args": [ { "prim": "nat", "args": [] }, { "prim": "nat", "args": [] } ], "annots": [":t"] }`

As in the concrete syntax, all domain specific constants are encoded as strings.

## Examples¶

Contracts in the system are stored as a piece of code and a global data
storage. The type of the global data of the storage is fixed for each
contract at origination time. This is ensured statically by checking on
origination that the code preserves the type of the global data. For
this, the code of the contract is checked to be of type
`lambda (pair 'arg 'global) -> (pair (list operation) 'global)`

where
`'global`

is the type of the original global store given on origination.
The contract also takes a parameter and returns a list of internal operations,
hence the complete calling convention above. The internal operations are
queued for execution when the contract returns.

### Empty contract¶

The simplest contract is the contract for which the `parameter`

and
`storage`

are all of type `unit`

. This contract is as follows:

```
code { CDR ; # keep the storage
NIL operation ; # return no internal operation
PAIR }; # respect the calling convention
storage unit;
parameter unit;
```

### Example contract with entrypoints¶

The following contract maintains a number in its storage. It has two
entrypoints `add`

and `sub`

to modify it, and the default
entrypoint, of type `unit`

will reset it to `0`

.

```
{ parameter (or (or (nat %add) (nat %sub)) (unit %default)) ;
storage int ;
code { AMOUNT ; PUSH mutez 0 ; ASSERT_CMPEQ ; UNPAIR ;
IF_LEFT
{ IF_LEFT { ADD } { SWAP ; SUB } }
{ DROP ; DROP ; PUSH int 0 } ;
NIL operation ; PAIR } }
```

### Example contract with recursive lambda¶

The following contract computes the factorial of the given parameter using a recursive function and then saves the result in the storage.

In Michelson regular functions start with a stack containing a single
value, the function argument. If the function is of type ```
lambda int
int
```

, when calling the function the stack will have just an
`int`

. Recursive functions start with two values, the argument and
the function itself. Therefore, if the recursive function is of type
`lambda int int`

then, when it is being called, the stack will have
an `int`

at the top and a `lambda int int`

at the bottom.

In this recursive factorial we can see the first branch of the `IF`

,
this is the base case. The second one performs the recursive call. To
do that, we need to access the function. This is what the `DUP 3`

instruction does. Then we decrement the argument and finally make the
recursive call with `EXEC`

.

```
{ parameter int;
storage int;
code { CAR ;
LAMBDA_REC int int
{ DUP;
EQ;
IF { PUSH int 1 }
{ DUP;
DUP 3;
PUSH int 1;
DUP 4;
SUB;
EXEC;
MUL};
DIP { DROP 2 }};
SWAP;
EXEC;
NIL operation;
PAIR}}
```

### Multisig contract¶

The multisig is a typical access control contract. The ownership of
the multisig contract is shared between `N`

participants represented
by their public keys in the contract’s storage. Any action on the
multisig contract needs to be signed by `K`

participants where the
threshold `K`

is also stored in the storage.

To avoid replay of the signatures sent to the contract, the signed data include not only a description of the action to perform but also the address of the multisig contract and a counter that gets incremented at each successful call to the contract.

The multisig commands of Octez command line client use this smart contract. Moreover, functional correctness of this contract has been verified using the Coq proof assistant.

```
parameter (pair
(pair :payload
(nat %counter) # counter, used to prevent replay attacks
(or :action # payload to sign, represents the requested action
(pair :transfer # transfer tokens
(mutez %amount) # amount to transfer
(contract %dest unit)) # destination to transfer to
(or
(option %delegate key_hash) # change the delegate to this address
(pair %change_keys # change the keys controlling the multisig
(nat %threshold) # new threshold
(list %keys key))))) # new list of keys
(list %sigs (option signature))); # signatures
storage (pair (nat %stored_counter) (pair (nat %threshold) (list %keys key))) ;
code
{
UNPAIR ; SWAP ; DUP ; DIP { SWAP } ;
DIP
{
UNPAIR ;
# pair the payload with the current contract address, to ensure signatures
# can't be replayed across different contracts if a key is reused.
DUP ; SELF ; ADDRESS ; CHAIN_ID ; PAIR ; PAIR ;
PACK ; # form the binary payload that we expect to be signed
DIP { UNPAIR @counter ; DIP { SWAP } } ; SWAP
} ;
# Check that the counters match
UNPAIR @stored_counter; DIP { SWAP };
ASSERT_CMPEQ ;
# Compute the number of valid signatures
DIP { SWAP } ; UNPAIR @threshold @keys;
DIP
{
# Running count of valid signatures
PUSH @valid nat 0; SWAP ;
ITER
{
DIP { SWAP } ; SWAP ;
IF_CONS
{
IF_SOME
{ SWAP ;
DIP
{
SWAP ; DIIP { DIP { DUP } ; SWAP } ;
# Checks signatures, fails if invalid
CHECK_SIGNATURE ; ASSERT ;
PUSH nat 1 ; ADD @valid } }
{ SWAP ; DROP }
}
{
# There were fewer signatures in the list
# than keys. Not all signatures must be present, but
# they should be marked as absent using the option type.
FAIL
} ;
SWAP
}
} ;
# Assert that the threshold is less than or equal to the
# number of valid signatures.
ASSERT_CMPLE ;
DROP ; DROP ;
# Increment counter and place in storage
DIP { UNPAIR ; PUSH nat 1 ; ADD @new_counter ; PAIR} ;
# We have now handled the signature verification part,
# produce the operation requested by the signers.
NIL operation ; SWAP ;
IF_LEFT
{ # Transfer tokens
UNPAIR ; UNIT ; TRANSFER_TOKENS ; CONS }
{ IF_LEFT {
# Change delegate
SET_DELEGATE ; CONS }
{
# Change set of signatures
DIP { SWAP ; CAR } ; SWAP ; PAIR ; SWAP }} ;
PAIR }
```

## Full grammar¶

```
<data> ::=
| <int constant>
| <string constant>
| <byte sequence constant>
| Unit
| True
| False
| Pair <data> <data> ...
| Left <data>
| Right <data>
| Some <data>
| None
| Lambda_rec <instruction>
| { <data> ; ... }
| { Elt <data> <data> ; ... }
| instruction
<natural number constant> ::=
| [0-9]+
<int constant> ::=
| <natural number constant>
| -<natural number constant>
<string constant> ::=
| "<string content>*"
<string content> ::=
| \"
| \r
| \n
| \t
| \b
| \\
| [^"\]
<byte sequence constant> ::=
| 0x[0-9a-fA-F]+
<instruction> ::=
| { <instruction> ... }
| DROP
| DROP <natural number constant>
| DUP
| DUP <natural number constant>
| SWAP
| DIG <natural number constant>
| DUG <natural number constant>
| PUSH <type> <data>
| SOME
| NONE <type>
| UNIT
| NEVER
| IF_NONE { <instruction> ... } { <instruction> ... }
| PAIR
| PAIR <natural number constant>
| CAR
| CDR
| UNPAIR
| UNPAIR <natural number constant>
| LEFT <type>
| RIGHT <type>
| IF_LEFT { <instruction> ... } { <instruction> ... }
| NIL <type>
| CONS
| IF_CONS { <instruction> ... } { <instruction> ... }
| SIZE
| EMPTY_SET <comparable type>
| EMPTY_MAP <comparable type> <type>
| EMPTY_BIG_MAP <comparable type> <type>
| MAP { <instruction> ... }
| ITER { <instruction> ... }
| MEM
| GET
| GET <natural number constant>
| UPDATE
| UPDATE <natural number constant>
| IF { <instruction> ... } { <instruction> ... }
| LOOP { <instruction> ... }
| LOOP_LEFT { <instruction> ... }
| LAMBDA <type> <type> { <instruction> ... }
| LAMBDA_REC <type> <type> { <instruction> ... }
| EXEC
| APPLY
| DIP { <instruction> ... }
| DIP <natural number constant> { <instruction> ... }
| FAILWITH
| CAST
| RENAME
| CONCAT
| SLICE
| PACK
| UNPACK <type>
| ADD
| SUB
| MUL
| EDIV
| ABS
| ISNAT
| INT
| NEG
| LSL
| LSR
| OR
| AND
| XOR
| NOT
| COMPARE
| EQ
| NEQ
| LT
| GT
| LE
| GE
| SELF
| SELF_ADDRESS
| CONTRACT <type>
| TRANSFER_TOKENS
| SET_DELEGATE
| CREATE_CONTRACT { <instruction> ... }
| IMPLICIT_ACCOUNT
| VOTING_POWER
| NOW
| LEVEL
| AMOUNT
| BALANCE
| CHECK_SIGNATURE
| BLAKE2B
| KECCAK
| SHA3
| SHA256
| SHA512
| HASH_KEY
| SOURCE
| SENDER
| ADDRESS
| CHAIN_ID
| TOTAL_VOTING_POWER
| PAIRING_CHECK
| SAPLING_EMPTY_STATE <natural number constant>
| SAPLING_VERIFY_UPDATE
| TICKET
| READ_TICKET
| SPLIT_TICKET
| JOIN_TICKETS
| OPEN_CHEST
| BYTES
| NAT
<type> ::=
| <comparable type>
| option <type>
| list <type>
| set <comparable type>
| operation
| contract <type>
| ticket <comparable type>
| pair <type> <type> ...
| or <type> <type>
| lambda <type> <type>
| map <comparable type> <type>
| big_map <comparable type> <type>
| bls12_381_g1
| bls12_381_g2
| bls12_381_fr
| sapling_transaction <natural number constant>
| sapling_state <natural number constant>
| chest
| chest_key
<comparable type> ::=
| unit
| never
| bool
| int
| nat
| string
| chain_id
| bytes
| mutez
| key_hash
| key
| signature
| timestamp
| address
| tx_rollup_l2_address
| option <comparable type>
| or <comparable type> <comparable type>
| pair <comparable type> <comparable type> ...
```

## Reference implementation¶

The language is implemented in OCaml as follows:

The lower internal representation is written as a GADT whose type parameters encode exactly the typing rules given in this specification. In other words, if a program written in this representation is accepted by OCaml’s typechecker, it is guaranteed type-safe. This is of course also valid for programs not handwritten but generated by OCaml code, so we are sure that any manipulated code is type-safe.

In the end, what remains to be checked is the encoding of the typing rules as OCaml types, which boils down to half a line of code for each instruction. Everything else is left to the venerable and well trusted OCaml.

The interpreter is basically the direct transcription of the rewriting rules presented above. It takes an instruction, a stack and transforms it. OCaml’s typechecker ensures that the transformation respects the pre and post stack types declared by the GADT case for each instruction.

The only things that remain to be reviewed are value dependent choices, such as we did not swap true and false when interpreting the IF instruction.

The input, untyped internal representation is an OCaml ADT with only 5 grammar constructions:

`String`

,`Int`

,`Bytes`

,`Seq`

and`Prim`

. It is the target language for the parser, since not all parsable programs are well typed, and thus could simply not be constructed using the GADT.The typechecker is a simple function that recognizes the abstract grammar described in section X by pattern matching, producing the well-typed, corresponding GADT expressions. It is mostly a checker, not a full inferrer, and thus takes some annotations (basically the input and output of the program, of lambdas and of uninitialized maps and sets). It works by performing a symbolic evaluation of the program, transforming a symbolic stack. It only needs one pass over the whole program.

Here again, OCaml does most of the checking, the structure of the function is very simple, what we have to check is that we transform a

`Prim ("If", ...)`

into an`If`

, a`Prim ("Dup", ...)`

into a`Dup`

, etc.