Loop guards tend to provide better results when it comes to reasoning
about ranges than isLoopEntryGuardedByCond(). See the test change for
the motivating case.
I have retained both the loop guard check and the implied cond based
check for now, though the latter only seems to impact a single test and
only via side effects (nowrap flag calculation) at that.
Use the disjoint flag to convert or to add instead of calling the
haveNoCommonBitsSet() ValueTracking query. This ensures that we can
reliably undo add -> or canonicalization, even in cases where the
necessary information has been lost or is too complex to reinfer in
SCEV.
I have updated the bulk of the test coverage to add the necessary
disjoint flags in advance.
This an alternative to #69886. The basic problem is that SCEV can look
through trivial LCSSA phis. When the phi node later becomes non-trivial,
we do invalidate it, but this doesn't catch uses that are not covered by
the IR use-def walk, such as those in BECounts.
Fix this by adding a special invalidation method for LCSSA phis, which
will also invalidate all the SCEVUnknowns/SCEVAddRecExprs used by the
LCSSA phi node and defined in the loop.
We should probably also use this invalidation method in other places
that add predecessors to exit blocks, such as loop unrolling and loop
peeling.
Fixes#69097.
Fixes#66616.
Fixes#63970.
In commit 5a9a02f67b scalar evolution got support for
computing SCEV:s for (ashr(add(shl(x, n), c), m)) constructs. The code
however used APInt::getZExtValue without first checking that the APInt
would fit inside an uint64_t. When for example using 128-bit types we
ended up in assertion failures (or maybe miscompiles in non-assert
builds).
This patch simply avoid converting from APInt to uint64_t when creating
the truncated constant. We can just truncate the APInt instead.
As far as I can tell, there's nothing in this code which actually
assumes the two predicates in (FoundLHS FoundPred FoundRHS) => (LHS Pred
RHS) are the same.
Noticed while investigating something else, this is purely an
oppurtunistic optimization while I'm looking at the code. Unfortunately,
this doesn't solve my original problem. :)
We can't support this once mul constant expressions are removed,
and this is not useful in any practical sense (as this code is
primarily intended for GEP expressions).
update_analyze_test_checks.py will now insert check lines for
empty lines, which means that all the existing test coverage will
have a spurious change to check for the newline after "Predicates:".
I don't think we actually want to have that newline, so drop it
before it gets into more test coverage.
This patch fixes a miscompile in LSR caused by incorrect inference of
NUW flag for AddRec: we shouldn't infer no-wrap flags based on a
comparison which doesn't fully control the loop exit.
The old algorithm would remove all operands matching %step SCEV when it
intended to only remove a single one. This lead to assert when
SCEVAddExpr was of the form %step + %step and potential miscompiles in
similar cases. Such SCEVs could be created when construction reached
depth thresholds.
Fixes#70348
C++20 comes with std::erase to erase a value from std::vector. This
patch renames llvm::erase_value to llvm::erase for consistency with
C++20.
We could make llvm::erase more similar to std::erase by having it
return the number of elements removed, but I'm not doing that for now
because nobody seems to care about that in our code base.
Since there are only 50 occurrences of erase_value in our code base,
this patch replaces all of them with llvm::erase and deprecates
llvm::erase_value.
When a SCEVCallbackVH is RAUWed, we currently do a def-use walk and
remove dependent instructions from the ValueExprMap. However, unlike
SCEVs usual invalidation, this does not forget memoized values.
The end result is that we might end up removing a SCEVUnknown from the
map, while that expression still has users. Due to that, we may later
fail to invalide those expressions. In particular, invalidation of loop
dispositions only does something if there is an expression for the
value, which would not be the case here.
Fix this by using the standard forgetValue() API, instead of rolling a
custom variant.
Fixes https://github.com/llvm/llvm-project/issues/68285.
Unforuntately, the assumption underlying this optimization is
incorrect for getSCEVAtScope(): A SCEVUnknown instruction with
operands that have constant loop exit values can evaluate to
a constant, thus creating a dependency from an "always unknown"
instruction.
Losing this optimization is quite unfortunate, but it doesn't
seem like there is any simple workaround for this.
Fixes#68260.
This reverts commit 3ddd1ffb72.
The only thing we care about here is that we don't exit on the
first iteration. Whether the BTC is large enough to overflow the
signed integer space is not relevant.
SCEVExpander currently has special handling for the case where the
start or the step of an addrec do not dominate the loop header,
which is not used by any lit test.
Initially I thought that this is entirely dead code, because
addrec operands are required to be loop invariant. However,
SCEV currently allows creating an addrec with operands that are
loop invariant but defined *after* the loop.
This doesn't seem like a useful case to allow, and we don't
appear to be using this outside a single easy to adjust unit test.
The following commit enabled the analysis of ranges for heap allocations:
22ca38da25
The range turns out to be empty in cases such as the one in test (which
is [1,1)), leading to an assertion failure. This patch fixes for the
same case.
Fixes https://github.com/llvm/llvm-project/issues/63856
Reviewed By: fhahn
Differential Revision: https://reviews.llvm.org/D159160
%x = shl i64 %w, n
%y = add i64 %x, c
%z = ashr i64 %y, m
The above given instruction triplet is seen many times in the generated
LLVM IR, but SCEV model is not able to compute the SCEV value of AShr
instruction in this case.
This patch models the two cases of the above instruction pattern using
the following expression:
=> sext(add(mul(trunc(w), 2^(n-m)), c >> m))
1) when n = m the expression reduces to sext(add(trunc(w), c >> n))
as n-m=0, and multiplying with 2^0 gives the same result.
2) when n > m the expression works as given above.
It also adds several unittest to verify that SCEV is able to compute
the value.
$ opt sext-add-inreg.ll -passes="print<scalar-evolution>"
Comparing the snippets of the result of SCEV analysis:
* SCEV of ashr before change
----------------------------
%idxprom = ashr exact i64 %sext, 32
--> %idxprom U: [-2147483648,2147483648) S: [-2147483648,2147483648)
Exits: 8 LoopDispositions: { %for.body: Variant }
* SCEV of ashr after change
---------------------------
%idxprom = ashr exact i64 %sext, 32
--> {0,+,1}<nuw><nsw><%for.body> U: [0,9) S: [0,9)
Exits: 8 LoopDispositions: { %for.body: Computable }
LoopDisposition of the given SCEV was LoopVariant before, after adding
the new way to model the instruction, the LoopDisposition becomes
LoopComputable as it is able to compute the SCEV of the instruction.
Differential Revision: https://reviews.llvm.org/D152278
SCEVExpander tries to reuse existing instruction with the same
SCEV expression. However, doing this replacement blindly is not
safe, because the instruction might be more poisonous.
What we were already doing is to drop poison-generating flags on
the reused instruction. But this is not the only way that more
poison can be introduced. The poison-generating flag might not
be directly on the reused instruction, or the poison contribution
might come from something like 0 * %var, which folds to 0 but can
still introduce poison.
This patch fixes the issue in a principled way, by determining which
values can contribute poison to the SCEV expression, and then
checking whether any additional values can contribute poison to the
instruction being reused. Poison-generating flags are dropped if
doing that enables reuse.
This is a pretty big hammer and does cause some regressions in
tests, but less than I would have expected. I wasn't able to come
up with a less intrusive fix that still satisfies the correctness
requirements.
Fixes https://github.com/llvm/llvm-project/issues/63763.
Fixes https://github.com/llvm/llvm-project/issues/63926.
Fixes https://github.com/llvm/llvm-project/issues/64333.
Fixes https://github.com/llvm/llvm-project/issues/63727.
Differential Revision: https://reviews.llvm.org/D158181
We know that certain pointers (e.g. non-extern-weak globals or
allocas in default address space) are not null, in which case the
lowest address they can be allocated at is their alignment.
This allows us to calculate better exit counts for loops that have
an additional null check in the guarding condition
(see alloca_icmp_null_exit_count).
Differential Revision: https://reviews.llvm.org/D153624
In preparation for removing the `#include "llvm/ADT/StringExtras.h"`
from the header to source file of `llvm/Support/Error.h`, first add in
all the missing includes that were previously included transitively
through this header.
The object size and alignment based restriction on the possible
allocation range also applies to allocas, not just globals, so
handle them as well.
We shouldn't really need any type restriction here at all, but
for now stay conservative.
When multiplying several AddRecs, we do the following simplification:
{A1,+,A2,+,...,+,An}<L> * {B1,+,B2,+,...,+,Bn}<L> = {x=1 in [ sum y=x..2x
[ sum z=max(y-x, y-n)..min(x,n) [
choose(x, 2x)*choose(2x-y, x-z)*A_{y-z}*B_z]]
],+,...up to x=2n}
This is done iteratively, pair by pair. So if we try to multiply three AddRecs
A1, A2, A3, then we'd try to simplify A1 * A2 to A1' and then try to
simplify A1' * A3 if A1' is also an AddRec.
The transform is only legal if the loops of the two AddRecs are the same.
It is checked in the code, but the loop of one of the AddRecs is stored
in a local variable and doesn't get updated when we simplify a pair to a new AddRec.
In the motivating test the new AddRec A1' was created for a different loop and,
as the loop variable didn't get updated, the check for different loops passed and
the transform worked for two AddRecs from different loops.
So it created a wrong SCEV. And it caused LSR to replace an instruction with another
one that had the same SCEV as the incorrectly computed one.
Differential Revision: https://reviews.llvm.org/D153254
If we didn't find the extact ZExt expr in the rewrite map, check if
there's an entry for a smaller ZExt we can use instead.
Reviewed By: nikic
Differential Revision: https://reviews.llvm.org/D149786
This is now checked as part of the usual SCEV verification. There
is little value in checking this on each lookup.
These two maps are strictly synchronized nowadays, which was not
the case historically.
Before this patch, we can only use the MaxBECount for an AddRec's range
computation if the MaxBECount has <= bit width of the AddRec. This patch
reasons that if a MaxBECount has > bit width, and is <= the max value of
AddRec's bit width, we can still use the MaxBECount.
Reviewed By: nikic
Differential Revision: https://reviews.llvm.org/D151698
This exposed an issue in SCEVExpander/LCSSA, which has been fixed
in D150681.
-----
As far as I understand, the IsAvailableOnEntry() function basically
implements the same functionality as the properlyDominates() block
disposition. The primary difference (apart from a weaker
implementation) seems to be in this comment at the top:
// Checks if the SCEV S is available at BB. S is considered available at BB
// if S can be materialized at BB without introducing a fault.
However, I don't really understand why there would be such a
requirement. It's my understanding that SCEV explicitly does not
care about trapping udiv instructions itself, and it's the job of
SCEVExpander's isSafeToExpand() to make sure these don't get
expanded if they may trap.
Differential Revision: https://reviews.llvm.org/D149344
This fixes assertion crash in https://github.com/llvm/llvm-project/issues/62380.
In the beginning of ScalarEvolution::getBackedgeTakenInfo
we make sure that BackedgeTakenCounts contains an entry
for the given loop.
Then we call computeBackedgeTakenCount which computes the result,
and in the end we insert it in the map like so:
return BackedgeTakenCounts.find(L)->second = std::move(Result);
So we expect that the entry for L still exists in the cache.
However, it can get deleted. When it has computed the result,
getBackedgeTakenInfo clears all the cached SCEVs that use the AddRecs in the loop.
In the crashing example, getBackedgeTakenInfo first gets called on an inner loop,
and during this call it gets called again on its parent loop.
This recursion happens after the call to computeBackedgeTakenCount.
And it happens so that some SCEV from the BTI of the child loop uses
an AddRec of the parent loop. So when we successfully compute BTI
for the parent loop, we erase already computed result for the child one.
The recursion happens in some debug only code that
updates statistics. The algorithm itself is non-recursive.
Namely the recursive call happens in BackedgeTakenInfo::getExact function
and its return value is only used to compare it against SCEVCouldNotCompute.
As suggested by nikic I replaced the NumTripCountsComputed and NumTripCountsNotComputed
with NumExitCountsComputed and NumExitCountsNotComputed respectively.
They are updated during computations made for single exits. It relieves us of the need
to compute exact exit count for the loop just to update the named
statistic and thus the recursion cannot happen anymore.
Differential Revision: https://reviews.llvm.org/D149251
This patch-set aims to simplify the existing RVV segment load/store
intrinsics to use a type that represents a tuple of vectors instead.
To achieve this, first we need to relax the current limitation for an
aggregate type to be a target of load/store/alloca when the aggregate
type contains homogeneous scalable vector types. Then to adjust the
prolog of an LLVM function during lowering to clang. Finally we
re-define the RVV segment load/store intrinsics to use the tuple types.
The pull request under the RVV intrinsic specification is
riscv-non-isa/rvv-intrinsic-doc#198
---
This is the 1st patch of the patch-set. This patch is originated from
D98169.
This patch allows aggregate type (StructType) that contains homogeneous
scalable vector types to be a target of load/store/alloca. The RFC of
this patch was posted in LLVM Discourse.
https://discourse.llvm.org/t/rfc-ir-permit-load-store-alloca-for-struct-of-the-same-scalable-vector-type/69527
The main changes in this patch are:
Extend `StructLayout::StructSize` from `uint64_t` to `TypeSize` to
accommodate an expression of scalable size.
Allow `StructType:isSized` to also return true for homogeneous
scalable vector types.
Let `Type::isScalableTy` return true when `Type` is `StructType`
and contains scalable vectors
Extra description is added in the LLVM Language Reference Manual on the
relaxation of this patch.
Authored-by: Hsiangkai Wang <kai.wang@sifive.com>
Co-Authored-by: eop Chen <eop.chen@sifive.com>
Reviewed By: craig.topper, nikic
Differential Revision: https://reviews.llvm.org/D146872
