llvm/docs/MemorySSA.rst

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MemorySSA
=========

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Introduction
============

``MemorySSA`` is an analysis that allows us to cheaply reason about the
interactions between various memory operations. Its goal is to replace
``MemoryDependenceAnalysis`` for most (if not all) use-cases. This is because,
unless you're very careful, use of ``MemoryDependenceAnalysis`` can easily
result in quadratic-time algorithms in LLVM. Additionally, ``MemorySSA`` doesn't
have as many arbitrary limits as ``MemoryDependenceAnalysis``, so you should get
better results, too.

At a high level, one of the goals of ``MemorySSA`` is to provide an SSA based
form for memory, complete with def-use and use-def chains, which
enables users to quickly find may-def and may-uses of memory operations.
It can also be thought of as a way to cheaply give versions to the complete
state of heap memory, and associate memory operations with those versions.

This document goes over how ``MemorySSA`` is structured, and some basic
intuition on how ``MemorySSA`` works.

A paper on MemorySSA (with notes about how it's implemented in GCC) `can be
found here <http://www.airs.com/dnovillo/Papers/mem-ssa.pdf>`_. Though, it's
relatively out-of-date; the paper references multiple heap partitions, but GCC
eventually swapped to just using one, like we now have in LLVM.  Like
GCC's, LLVM's MemorySSA is intraprocedural.


MemorySSA Structure
===================

MemorySSA is a virtual IR. After it's built, ``MemorySSA`` will contain a
structure that maps ``Instruction`` s to ``MemoryAccess`` es, which are
``MemorySSA``'s parallel to LLVM ``Instruction`` s.

Each ``MemoryAccess`` can be one of three types:

- ``MemoryPhi``
- ``MemoryUse``
- ``MemoryDef``

``MemoryPhi`` s are ``PhiNode`` , but for memory operations. If at any
point we have two (or more) ``MemoryDef`` s that could flow into a
``BasicBlock``, the block's top ``MemoryAccess`` will be a
``MemoryPhi``. As in LLVM IR, ``MemoryPhi`` s don't correspond to any
concrete operation. As such, you can't look up a ``MemoryPhi`` with an
``Instruction`` (though we do allow you to do so with a
``BasicBlock``).

Note also that in SSA, Phi nodes merge must-reach definitions (that
is, definite new versions of variables).  In MemorySSA, PHI nodes merge
may-reach definitions (that is, until disambiguated, the versions that
reach a phi node may or may not clobber a given variable)

``MemoryUse`` s are operations which use but don't modify memory. An example of
a ``MemoryUse`` is a ``load``, or a ``readonly`` function call.

``MemoryDef`` s are operations which may either modify memory, or which
otherwise clobber memory in unquantifiable ways. Examples of ``MemoryDef`` s
include ``store`` s, function calls, ``load`` s with ``acquire`` (or higher)
ordering, volatile operations, memory fences, etc.

Every function that exists has a special ``MemoryDef`` called ``liveOnEntry``.
It dominates every ``MemoryAccess`` in the function that ``MemorySSA`` is being
run on, and implies that we've hit the top of the function. It's the only
``MemoryDef`` that maps to no ``Instruction`` in LLVM IR. Use of
``liveOnEntry`` implies that the memory being used is either undefined or
defined before the function begins.

An example of all of this overlayed on LLVM IR (obtained by running ``opt
-passes='print<memoryssa>' -disable-output`` on an ``.ll`` file) is below. When
viewing this example, it may be helpful to view it in terms of clobbers. The
operands of a given ``MemoryAccess`` are all (potential) clobbers of said
MemoryAccess, and the value produced by a ``MemoryAccess`` can act as a clobber
for other ``MemoryAccess`` es. Another useful way of looking at it is in
terms of heap versions.  In that view, operands of of a given
``MemoryAccess`` are the version of the heap before the operation, and
if the access produces a value, the value is the new version of the heap
after the operation.

.. code-block:: llvm

  define void @foo() {
  entry:
    %p1 = alloca i8
    %p2 = alloca i8
    %p3 = alloca i8
    ; 1 = MemoryDef(liveOnEntry)
    store i8 0, i8* %p3
    br label %while.cond

  while.cond:
    ; 6 = MemoryPhi({%0,1},{if.end,4})
    br i1 undef, label %if.then, label %if.else

  if.then:
    ; 2 = MemoryDef(6)
    store i8 0, i8* %p1
    br label %if.end

  if.else:
    ; 3 = MemoryDef(6)
    store i8 1, i8* %p2
    br label %if.end

  if.end:
    ; 5 = MemoryPhi({if.then,2},{if.else,3})
    ; MemoryUse(5)
    %1 = load i8, i8* %p1
    ; 4 = MemoryDef(5)
    store i8 2, i8* %p2
    ; MemoryUse(1)
    %2 = load i8, i8* %p3
    br label %while.cond
  }

The ``MemorySSA`` IR is shown in comments that precede the instructions they map
to (if such an instruction exists). For example, ``1 = MemoryDef(liveOnEntry)``
is a ``MemoryAccess`` (specifically, a ``MemoryDef``), and it describes the LLVM
instruction ``store i8 0, i8* %p3``. Other places in ``MemorySSA`` refer to this
particular ``MemoryDef`` as ``1`` (much like how one can refer to ``load i8, i8*
%p1`` in LLVM with ``%1``). Again, ``MemoryPhi`` s don't correspond to any LLVM
Instruction, so the line directly below a ``MemoryPhi`` isn't special.

Going from the top down:

- ``6 = MemoryPhi({entry,1},{if.end,4})`` notes that, when entering
  ``while.cond``, the reaching definition for it is either ``1`` or ``4``. This
  ``MemoryPhi`` is referred to in the textual IR by the number ``6``.
- ``2 = MemoryDef(6)`` notes that ``store i8 0, i8* %p1`` is a definition,
  and its reaching definition before it is ``6``, or the ``MemoryPhi`` after
  ``while.cond``.
- ``3 = MemoryDef(6)`` notes that ``store i8 0, i8* %p2`` is a definition; its
  reaching definition is also ``6``.
- ``5 = MemoryPhi({if.then,2},{if.else,3})`` notes that the clobber before
  this block could either be ``2`` or ``3``.
- ``MemoryUse(5)`` notes that ``load i8, i8* %p1`` is a use of memory, and that
  it's clobbered by ``5``.
- ``4 = MemoryDef(5)`` notes that ``store i8 2, i8* %p2`` is a definition; it's
  reaching definition is ``5``.
- ``MemoryUse(1)`` notes that ``load i8, i8* %p3`` is just a user of memory,
  and the last thing that could clobber this use is above ``while.cond`` (e.g.
  the store to ``%p3``).  In heap versioning parlance, it really
  only depends on the heap version 1, and is unaffected by the new
  heap versions generated since then.

As an aside, ``MemoryAccess`` is a ``Value`` mostly for convenience; it's not
meant to interact with LLVM IR.

Design of MemorySSA
===================

``MemorySSA`` is an analysis that can be built for any arbitrary function. When
it's built, it does a pass over the function's IR in order to build up its
mapping of ``MemoryAccess`` es. You can then query ``MemorySSA`` for things like
the dominance relation between ``MemoryAccess`` es, and get the ``MemoryAccess``
for any given ``Instruction`` .

When ``MemorySSA`` is done building, it also hands you a ``MemorySSAWalker``
that you can use (see below).


The walker
----------

A structure that helps ``MemorySSA`` do its job is the ``MemorySSAWalker``, or
the walker, for short. The goal of the walker is to provide answers to clobber
queries beyond what's represented directly by ``MemoryAccess`` es. For example,
given:

.. code-block:: llvm

  define void @foo() {
    %a = alloca i8
    %b = alloca i8

    ; 1 = MemoryDef(liveOnEntry)
    store i8 0, i8* %a
    ; 2 = MemoryDef(1)
    store i8 0, i8* %b
  }

The store to ``%a`` is clearly not a clobber for the store to ``%b``. It would
be the walker's goal to figure this out, and return ``liveOnEntry`` when queried
for the clobber of ``MemoryAccess`` ``2``.

By default, ``MemorySSA`` provides a walker that can optimize ``MemoryDef`` s
and ``MemoryUse`` s by consulting alias analysis. Walkers were built to be
flexible, though, so it's entirely reasonable (and expected) to create more
specialized walkers (e.g. one that queries ``GlobalsAA``).


Locating clobbers yourself
^^^^^^^^^^^^^^^^^^^^^^^^^^

If you choose to make your own walker, you can find the clobber for a
``MemoryAccess`` by walking every ``MemoryDef`` that dominates said
``MemoryAccess``. The structure of ``MemoryDef`` s makes this relatively simple;
they ultimately form a linked list of every clobber that dominates the
``MemoryAccess`` that you're trying to optimize. In other words, the
``definingAccess`` of a ``MemoryDef`` is always the nearest dominating
``MemoryDef`` or ``MemoryPhi`` of said ``MemoryDef``.


Use optimization
----------------

``MemorySSA`` will optimize some ``MemoryAccess`` es at build-time.
Specifically, we optimize the operand of every ``MemoryUse`` to point to the
actual clobber of said ``MemoryUse``. This can be seen in the above example; the
second ``MemoryUse`` in ``if.end`` has an operand of ``1``, which is a
``MemoryDef`` from the entry block.  This is done to make walking,
value numbering, etc, faster and easier.
It is not possible to optimize ``MemoryDef`` in the same way, as we
restrict ``MemorySSA`` to one heap variable and, thus, one Phi node
per block.


Invalidation and updating
-------------------------

Because ``MemorySSA`` keeps track of LLVM IR, it needs to be updated whenever
the IR is updated. "Update", in this case, includes the addition, deletion, and
motion of ``Instructions``. The update API is being made on an as-needed basis.
If you'd like examples, ``GVNHoist`` is a user of ``MemorySSA`` s update API.


Phi placement
^^^^^^^^^^^^^

``MemorySSA`` only places ``MemoryPhi`` s where they're actually
needed. That is, it is a pruned SSA form, like LLVM's SSA form.  For
example, consider:

.. code-block:: llvm

  define void @foo() {
  entry:
    %p1 = alloca i8
    %p2 = alloca i8
    %p3 = alloca i8
    ; 1 = MemoryDef(liveOnEntry)
    store i8 0, i8* %p3
    br label %while.cond

  while.cond:
    ; 3 = MemoryPhi({%0,1},{if.end,2})
    br i1 undef, label %if.then, label %if.else

  if.then:
    br label %if.end

  if.else:
    br label %if.end

  if.end:
    ; MemoryUse(1)
    %1 = load i8, i8* %p1
    ; 2 = MemoryDef(3)
    store i8 2, i8* %p2
    ; MemoryUse(1)
    %2 = load i8, i8* %p3
    br label %while.cond
  }

Because we removed the stores from ``if.then`` and ``if.else``, a ``MemoryPhi``
for ``if.end`` would be pointless, so we don't place one. So, if you need to
place a ``MemoryDef`` in ``if.then`` or ``if.else``, you'll need to also create
a ``MemoryPhi`` for ``if.end``.

If it turns out that this is a large burden, we can just place ``MemoryPhi`` s
everywhere. Because we have Walkers that are capable of optimizing above said
phis, doing so shouldn't prohibit optimizations.


Non-Goals
---------

``MemorySSA`` is meant to reason about the relation between memory
operations, and enable quicker querying.
It isn't meant to be the single source of truth for all potential memory-related
optimizations. Specifically, care must be taken when trying to use ``MemorySSA``
to reason about atomic or volatile operations, as in:

.. code-block:: llvm

  define i8 @foo(i8* %a) {
  entry:
    br i1 undef, label %if.then, label %if.end

  if.then:
    ; 1 = MemoryDef(liveOnEntry)
    %0 = load volatile i8, i8* %a
    br label %if.end

  if.end:
    %av = phi i8 [0, %entry], [%0, %if.then]
    ret i8 %av
  }

Going solely by ``MemorySSA``'s analysis, hoisting the ``load`` to ``entry`` may
seem legal. Because it's a volatile load, though, it's not.


Design tradeoffs
----------------

Precision
^^^^^^^^^

``MemorySSA`` in LLVM deliberately trades off precision for speed.
Let us think about memory variables as if they were disjoint partitions of the
heap (that is, if you have one variable, as above, it represents the entire
heap, and if you have multiple variables, each one represents some
disjoint portion of the heap)

First, because alias analysis results conflict with each other, and
each result may be what an analysis wants (IE
TBAA may say no-alias, and something else may say must-alias), it is
not possible to partition the heap the way every optimization wants.
Second, some alias analysis results are not transitive (IE A noalias B,
and B noalias C, does not mean A noalias C), so it is not possible to
come up with a precise partitioning in all cases without variables to
represent every pair of possible aliases.  Thus, partitioning
precisely may require introducing at least N^2 new virtual variables,
phi nodes, etc.

Each of these variables may be clobbered at multiple def sites.

To give an example, if you were to split up struct fields into
individual variables, all aliasing operations that may-def multiple struct
fields, will may-def more than one of them.  This is pretty common (calls,
copies, field stores, etc).

Experience with SSA forms for memory in other compilers has shown that
it is simply not possible to do this precisely, and in fact, doing it
precisely is not worth it, because now all the optimizations have to
walk tons and tons of virtual variables and phi nodes.

So we partition.  At the point at which you partition, again,
experience has shown us there is no point in partitioning to more than
one variable.  It simply generates more IR, and optimizations still
have to query something to disambiguate further anyway.

As a result, LLVM partitions to one variable.

Use Optimization
^^^^^^^^^^^^^^^^

Unlike other partitioned forms, LLVM's ``MemorySSA`` does make one
useful guarantee - all loads are optimized to point at the thing that
actually clobbers them. This gives some nice properties.  For example,
for a given store, you can find all loads actually clobbered by that
store by walking the immediate uses of the store.