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==================================
Nim Destructors and Move Semantics
==================================
.. contents::
About this document
===================
This document describes the upcoming Nim runtime which does
not use classical GC algorithms anymore but is based on destructors and
move semantics. The new runtime's advantages are that Nim programs become
oblivious to the involved heap sizes and programs are easier to write to make
effective use of multi-core machines. As a nice bonus, files and sockets and
the like will not require manual ``close`` calls anymore.
This document aims to be a precise specification about how
move semantics and destructors work in Nim.
Motivating example
==================
With the language mechanisms described here a custom seq could be
written as:
.. code-block:: nim
type
myseq*[T] = object
len, cap: int
data: ptr UncheckedArray[T]
proc `=destroy`*[T](x: var myseq[T]) =
if x.data != nil:
for i in 0..<x.len: `=destroy`(x.data[i])
dealloc(x.data)
x.data = nil
proc `=`*[T](a: var myseq[T]; b: myseq[T]) =
# do nothing for self-assignments:
if a.data == b.data: return
`=destroy`(a)
a.len = b.len
a.cap = b.cap
if b.data != nil:
a.data = cast[type(a.data)](alloc(a.cap * sizeof(T)))
for i in 0..<a.len:
a.data[i] = b.data[i]
proc `=move`*[T](a, b: var myseq[T]) =
# do nothing for self-assignments:
if a.data == b.data: return
`=destroy`(a)
a.len = b.len
a.cap = b.cap
a.data = b.data
# b's elements have been stolen so ensure that the
# destructor for b does nothing:
b.data = nil
b.len = 0
proc add*[T](x: var myseq[T]; y: sink T) =
if x.len >= x.cap: resize(x)
x.data[x.len] = y
inc x.len
proc `[]`*[T](x: myseq[T]; i: Natural): lent T =
assert i < x.len
x.data[i]
proc `[]=`*[T](x: myseq[T]; i: Natural; y: sink T) =
assert i < x.len
x.data[i] = y
proc createSeq*[T](elems: varargs[T]): myseq[T] =
result.cap = elems.len
result.len = elems.len
result.data = cast[type(result.data)](alloc(result.cap * sizeof(T)))
for i in 0..<result.len: result.data[i] = elems[i]
proc len*[T](x: myseq[T]): int {.inline.} = x.len
Lifetime-tracking hooks
=======================
The memory management for Nim's standard ``string`` and ``seq`` types as
well as other standard collections is performed via so called
"Lifetime-tracking hooks" or "type-bound operators". There are 3 different
hooks for each (generic or concrete) object type ``T`` (``T`` can also be a
``distinct`` type) that are called implicitly by the compiler.
(Note: The word "hook" here does not imply any kind of dynamic binding
or runtime indirections, the implicit calls are statically bound and
potentially inlined.)
`=destroy` hook
---------------
A `=destroy` hook frees the object's associated memory and releases
other associated resources. Variables are destroyed via this hook when
they go out of scope or when the routine they were declared in is about
to return.
The prototype of this hook for a type ``T`` needs to be:
.. code-block:: nim
proc `=destroy`(x: var T)
The general pattern in ``=destroy`` looks like:
.. code-block:: nim
proc `=destroy`(x: var T) =
# first check if 'x' was moved to somewhere else:
if x.field != nil:
freeResource(x.field)
x.field = nil
`=move` hook
------------
A `=move` hook moves an object around, the resources are stolen from the source
and passed to the destination. It must be ensured that source's destructor does
not free the resources afterwards.
The prototype of this hook for a type ``T`` needs to be:
.. code-block:: nim
proc `=move`(dest, source: var T)
The general pattern in ``=move`` looks like:
.. code-block:: nim
proc `=move`(dest, source: var T) =
# protect against self-assignments:
if dest.field != source.field:
`=destroy`(dest)
dest.field = source.field
source.field = nil
`=` (copy) hook
---------------
The ordinary assignment in Nim conceptually copies the values. The ``=`` hook
is called for assignments that couldn't be transformed into moves.
The prototype of this hook for a type ``T`` needs to be:
.. code-block:: nim
proc `=`(dest: var T; source: T)
The general pattern in ``=`` looks like:
.. code-block:: nim
proc `=`(dest: var T; source: T) =
# protect against self-assignments:
if dest.field != source.field:
`=destroy`(dest)
dest.field = duplicateResource(source.field)
The ``=`` proc can be marked with the ``{.error.}`` pragma. Then any assignment
that otherwise would lead to a copy is prevented at compile-time.
Move semantics
==============
A "move" can be regarded as an optimized copy operation. If the source of the
copy operation is not used afterwards, the copy can be replaced by a move. This
document uses the notation ``lastReadOf(x)`` to describe that ``x`` is not
used afterwards. This property is computed by a static control flow analysis
but can also be enforced by using ``system.move`` explicitly.
Swap
====
The need to check for self-assignments and also the need to destroy previous
objects inside ``=`` and ``=move`` is a strong indicator to treat ``system.swap``
as a builtin primitive of its own that simply swaps every field in the involved
objects via ``copyMem`` or a comparable mechanism.
In other words, ``swap(a, b)`` is **not** implemented
as ``let tmp = move(a); b = move(a); a = move(tmp)``!
This has further consequences:
* Objects that contain pointers that point to the same object are not supported
by Nim's model. Otherwise swapped objects would end up in an inconsistent state.
* Seqs can use ``realloc`` in the implementation.
Sink parameters
===============
To move a variable into a collection usually ``sink`` parameters are involved.
A location that is passed to a ``sink`` parameters should not be used afterwards.
This is ensured by a static analysis over a control flow graph. A sink parameter
*may* be consumed once in the proc's body but doesn't have to be consumed at all.
The reason for this is that signatures
like ``proc put(t: var Table; k: sink Key, v: sink Value)`` should be possible
without any further overloads and ``put`` might not take owership of ``k`` if
``k`` already exists in the table. Sink parameters enable an affine type system,
not a linear type system.
The employed static analysis is limited and only concerned with local variables;
however object and tuple fields are treated as separate entities:
.. code-block:: nim
proc consume(x: sink Obj) = discard "no implementation"
proc main =
let tup = (Obj(), Obj())
consume tup[0]
# ok, only tup[0] was consumed, tup[1] is still alive:
echo tup[1]
Sometimes it is required to explicitly ``move`` a value into its final position:
.. code-block:: nim
proc main =
var dest, src: array[10, string]
# ...
for i in 0..high(dest): dest[i] = move(src[i])
An implementation is allowed, but not required to implement even more move
optimizations (and the current implementation does not).
Self assignments
================
Unfortunately this document departs significantly from
the older design as specified here, https://github.com/nim-lang/Nim/wiki/Destructors.
The reason is that under the old design so called "self assignments" could not work.
.. code-block:: nim
proc select(cond: bool; a, b: sink string): string =
if cond:
result = a # moves a into result
else:
result = b # moves b into result
proc main =
var x = "abc"
var y = "xyz"
# possible self-assignment:
x = select(rand() < 0.5, x, y)
# 'select' must communicate what parameter has been
# consumed. We cannot simply generate:
# (select(...); wasMoved(x); wasMoved(y))
Consequence: ``sink`` parameters for objects that have a non-trivial destructor
must be passed as by-pointer under the hood. A further advantage is that parameters
are never destroyed, only variables are. The caller's location passed to
a ``sink`` parameter has to be destroyed by the caller and does not burden
the callee.
Const temporaries
=================
Constant literals like ``nil`` cannot be easily be ``=moved``'d. The solution
is to pass a temporary location that contains ``nil`` to the sink location.
In other words, ``var T`` can only bind to locations, but ``sink T`` can bind
to values.
For example:
.. code-block:: nim
var x: owned ref T = nil
# gets turned into by the compiler:
var tmp = nil
move(x, tmp)
Rewrite rules
=============
**Note**: A function call ``f()`` is always the "last read" of the involved
temporary location and so covered under the more general rewrite rules.
**Note**: There are two different allowed implementation strategies:
1. The produced ``finally`` section can be a single section that is wrapped
around the complete routine body.
2. The produced ``finally`` section is wrapped around the enclosing scope.
The current implementation follows strategy (1). This means that resources are
not destroyed at the scope exit, but at the proc exit.
::
var x: T; stmts
--------------- (destroy-var)
var x: T; try stmts
finally: `=destroy`(x)
f(...)
------------------------ (function-call)
(let tmp = f(...); tmp)
finally: `=destroy`(tmp)
x = lastReadOf z
------------------ (move-optimization)
`=move`(x, z)
x = y
------------------ (copy)
`=`(x, y)
x = move y
------------------ (enforced-move)
`=move`(x, y)
f_sink(notLastReadOf y)
----------------------- (copy-to-sink)
(let tmp; `=`(tmp, y); f_sink(tmp))
finally: `=destroy`(tmp)
f_sink(move y)
----------------------- (enforced-move-to-sink)
(let tmp; `=move`(tmp, y); f_sink(tmp))
finally: `=destroy`(tmp)
Cursor variables
================
There is an additional rewrite rule for so called "cursor" variables.
A cursor variable is a variable that is only used for navigation inside
a data structure. The otherwise implied copies (or moves) and destructions
can be avoided altogether for cursor variables:
::
var x {.cursor.}: T
x = path(z)
stmts
-------------------------- (cursor-var)
x = bitwiseCopy(path z)
stmts
# x is not destroyed.
``stmts`` must not mutate ``z`` nor ``x``. All assignments to ``x`` must be
of the form ``path(z)`` but the ``z`` can differ. Neither ``z`` nor ``x``
can be aliased; this implies the addresses of these locations must not be
used explicitly.
The current implementation does not compute cursor variables but supports
the ``.cursor`` pragma annotation. Cursor variables are respected and
simply trusted: No checking is performed that no mutations or aliasing
occurs.
Cursor variables are commonly used in ``iterator`` implementations:
.. code-block:: nim
iterator nonEmptyItems(x: seq[string]): string =
for i in 0..high(x):
let it {.cursor.} = x[i] # no string copies, no destruction of 'it'
if it.len > 0:
yield it
Lent type
=========
``proc p(x: sink T)`` means that the proc ``p`` takes ownership of ``x``.
To eliminate even more creation/copy <-> destruction pairs, a proc's return
type can be annotated as ``lent T``. This is useful for "getter" accessors
that seek to allow an immutable view into a container.
The ``sink`` and ``lent`` annotations allow us to remove most (if not all)
superfluous copies and destructions.
``lent T`` is like ``var T`` a hidden pointer. It is proven by the compiler
that the pointer does not outlive its origin. No destructor call is injected
for expressions of type ``lent T`` or of type ``var T``.
.. code-block:: nim
type
Tree = object
kids: seq[Tree]
proc construct(kids: sink seq[Tree]): Tree =
result = Tree(kids: kids)
# converted into:
`=move`(result.kids, kids)
proc `[]`*(x: Tree; i: int): lent Tree =
result = x.kids[i]
# borrows from 'x', this is transformed into:
result = addr x.kids[i]
# This means 'lent' is like 'var T' a hidden pointer.
# Unlike 'var' this cannot be used to mutate the object.
iterator children*(t: Tree): lent Tree =
for x in t.kids: yield x
proc main =
# everything turned into moves:
let t = construct(@[construct(@[]), construct(@[])])
echo t[0] # accessor does not copy the element!
Owned refs
==========
Let ``W`` be an ``owned ref`` type. Conceptually its hooks look like:
.. code-block:: nim
proc `=destroy`(x: var W) =
if x != nil:
assert x.refcount == 0, "dangling unowned pointers exist!"
`=destroy`(x[])
x = nil
proc `=`(x: var W; y: W) {.error: "owned refs can only be moved".}
proc `=move`(x, y: var W) =
if x != y:
`=destroy`(x)
bitwiseCopy x, y # raw pointer copy
y = nil
Let ``U`` be an unowned ``ref`` type. Conceptually its hooks look like:
.. code-block:: nim
proc `=destroy`(x: var U) =
if x != nil:
dec x.refcount
proc `=`(x: var U; y: U) =
# Note: No need to check for self-assignments here.
if y != nil: inc y.refcount
if x != nil: dec x.refcount
bitwiseCopy x, y # raw pointer copy
proc `=move`(x, y: var U) =
# Note: Moves are the same as assignments.
`=`(x, y)
Hook lifting
============
The hooks of a tuple type ``(A, B, ...)`` are generated by lifting the
hooks of the involved types ``A``, ``B``, ... to the tuple type. In
other words, a copy ``x = y`` is implemented
as ``x[0] = y[0]; x[1] = y[1]; ...``, likewise for ``=move`` and ``=destroy``.
Other value-based compound types like ``object`` and ``array`` are handled
correspondingly. For ``object`` however, the compiler generated hooks
can be overridden. This can also be important to use an alternative traversal
of the involved datastructure that is more efficient or in order to avoid
deep recursions.
Hook generation
===============
The ability to override a hook leads to a phase ordering problem:
.. code-block:: nim
type
Foo[T] = object
proc main =
var f: Foo[int]
# error: destructor for 'f' called here before
# it was seen in this module.
proc `=destroy`[T](f: var Foo[T]) =
discard
The solution is to define ``proc `=destroy`[T](f: var Foo[T])`` before
it is used. The compiler generates implicit
hooks for all types in *strategic places* so that an explicitly provided
hook that comes too "late" can be detected reliably. These *strategic places*
have been derived from the rewrite rules and are as follows:
- In the construct ``let/var x = ...`` (var/let binding)
hooks are generated for ``typeof(x)``.
- In ``x = ...`` (assignment) hooks are generated for ``typeof(x)``.
- In ``f(...)`` (function call) hooks are generated for ``typeof(f(...))``.
The most recent version of this document can be found here: https://github.com/nim-lang/Nim/blob/devel/doc/destructors.rst