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[PM] Fix a bug where through CGSCC iteration we can get
infinite-inlining across multiple runs of the inliner by keeping a tiny history of internal-to-SCC inlining decisions. This is still a bit gross, but I don't yet have any fundamentally better ideas and numerous people are blocked on this to use new PM and ThinLTO together. The core of the idea is to detect when we are about to do an inline that has a chance of re-splitting an SCC which we have split before with a similar inlining step. That is a critical component in the inlining forming a cycle and so far detects all of the various cyclic patterns I can come up with as well as the original real-world test case (which comes from a ThinLTO build of libunwind). I've added some tests that I think really demonstrate what is going on here. They are essentially state machines that march the inliner through various steps of a cycle and check that we stop when the cycle is closed and that we actually did do inlining to form that cycle. A lot of thanks go to Eric Christopher and Sanjoy Das for the help understanding this issue and improving the test cases. The biggest "yuck" here is the layering issue -- the CGSCC pass manager is providing somewhat magical state to the inliner for it to use to make itself converge. This isn't great, but I don't honestly have a lot of better ideas yet and at least seems nicely isolated. I have tested this patch, and it doesn't block *any* inlining on the entire LLVM test suite and SPEC, so it seems sufficiently narrowly targeted to the issue at hand. We have come up with hypothetical issues that this patch doesn't cover, but so far none of them are practical and we don't have a viable solution yet that covers the hypothetical stuff, so proceeding here in the interim. Definitely an area that we will be back and revisiting in the future. Differential Revision: https://reviews.llvm.org/D36188 git-svn-id: https://llvm.org/svn/llvm-project/llvm/trunk@309784 91177308-0d34-0410-b5e6-96231b3b80d8
This commit is contained in:
Chandler Carruth
parent
6023e68dae
commit
759393be2d
@ -275,6 +275,15 @@ struct CGSCCUpdateResult {
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/// non-null and can be used to continue processing the "top" of the
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/// post-order walk.
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LazyCallGraph::SCC *UpdatedC;
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/// A hacky area where the inliner can retain history about inlining
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/// decisions that mutated the call graph's SCC structure in order to avoid
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/// infinite inlining. See the comments in the inliner's CG update logic.
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///
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/// FIXME: Keeping this here seems like a big layering issue, we should look
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/// for a better technique.
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SmallDenseSet<std::pair<LazyCallGraph::Node *, LazyCallGraph::SCC *>, 4>
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&InlinedInternalEdges;
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};
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/// \brief The core module pass which does a post-order walk of the SCCs and
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@ -330,8 +339,12 @@ public:
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SmallPtrSet<LazyCallGraph::RefSCC *, 4> InvalidRefSCCSet;
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SmallPtrSet<LazyCallGraph::SCC *, 4> InvalidSCCSet;
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CGSCCUpdateResult UR = {RCWorklist, CWorklist, InvalidRefSCCSet,
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InvalidSCCSet, nullptr, nullptr};
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SmallDenseSet<std::pair<LazyCallGraph::Node *, LazyCallGraph::SCC *>, 4>
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InlinedInternalEdges;
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CGSCCUpdateResult UR = {RCWorklist, CWorklist, InvalidRefSCCSet,
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InvalidSCCSet, nullptr, nullptr,
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InlinedInternalEdges};
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PreservedAnalyses PA = PreservedAnalyses::all();
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CG.buildRefSCCs();
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@ -433,8 +446,12 @@ public:
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// invalid SCC and RefSCCs respectively. But we will short circuit
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// the processing when we check them in the loop above.
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} while (UR.UpdatedC);
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} while (!CWorklist.empty());
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// We only need to keep internal inlined edge information within
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// a RefSCC, clear it to save on space and let the next time we visit
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// any of these functions have a fresh start.
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InlinedInternalEdges.clear();
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} while (!RCWorklist.empty());
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}
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@ -872,6 +872,19 @@ PreservedAnalyses InlinerPass::run(LazyCallGraph::SCC &InitialC,
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InlineHistoryIncludes(&Callee, InlineHistoryID, InlineHistory))
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continue;
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// Check if this inlining may repeat breaking an SCC apart that has
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// already been split once before. In that case, inlining here may
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// trigger infinite inlining, much like is prevented within the inliner
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// itself by the InlineHistory above, but spread across CGSCC iterations
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// and thus hidden from the full inline history.
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if (CG.lookupSCC(*CG.lookup(Callee)) == C &&
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UR.InlinedInternalEdges.count({&N, C})) {
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DEBUG(dbgs() << "Skipping inlining internal SCC edge from a node "
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"previously split out of this SCC by inlining: "
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<< F.getName() << " -> " << Callee.getName() << "\n");
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continue;
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}
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// Check whether we want to inline this callsite.
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if (!shouldInline(CS, GetInlineCost, ORE))
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continue;
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@ -949,17 +962,38 @@ PreservedAnalyses InlinerPass::run(LazyCallGraph::SCC &InitialC,
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for (LazyCallGraph::Edge &E : *CalleeN)
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RC->insertTrivialRefEdge(N, E.getNode());
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}
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InlinedCallees.clear();
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// At this point, since we have made changes we have at least removed
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// a call instruction. However, in the process we do some incremental
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// simplification of the surrounding code. This simplification can
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// essentially do all of the same things as a function pass and we can
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// re-use the exact same logic for updating the call graph to reflect the
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// change..
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// change.
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LazyCallGraph::SCC *OldC = C;
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C = &updateCGAndAnalysisManagerForFunctionPass(CG, *C, N, AM, UR);
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DEBUG(dbgs() << "Updated inlining SCC: " << *C << "\n");
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RC = &C->getOuterRefSCC();
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// If this causes an SCC to split apart into multiple smaller SCCs, there
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// is a subtle risk we need to prepare for. Other transformations may
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// expose an "infinite inlining" opportunity later, and because of the SCC
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// mutation, we will revisit this function and potentially re-inline. If we
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// do, and that re-inlining also has the potentially to mutate the SCC
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// structure, the infinite inlining problem can manifest through infinite
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// SCC splits and merges. To avoid this, we capture the originating caller
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// node and the SCC containing the call edge. This is a slight over
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// approximation of the possible inlining decisions that must be avoided,
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// but is relatively efficient to store.
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// FIXME: This seems like a very heavyweight way of retaining the inline
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// history, we should look for a more efficient way of tracking it.
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if (C != OldC && llvm::any_of(InlinedCallees, [&](Function *Callee) {
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return CG.lookupSCC(*CG.lookup(*Callee)) == OldC;
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})) {
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DEBUG(dbgs() << "Inlined an internal call edge and split an SCC, "
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"retaining this to avoid infinite inlining.\n");
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UR.InlinedInternalEdges.insert({&N, OldC});
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}
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InlinedCallees.clear();
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}
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// Now that we've finished inlining all of the calls across this SCC, delete
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125
test/Transforms/Inline/cgscc-cycle.ll
Normal file
125
test/Transforms/Inline/cgscc-cycle.ll
Normal file
@ -0,0 +1,125 @@
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; This test contains extremely tricky call graph structures for the inliner to
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; handle correctly. They form cycles where the inliner introduces code that is
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; immediately or can eventually be transformed back into the original code. And
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; each step changes the call graph and so will trigger iteration. This requires
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; some out-of-band way to prevent infinitely re-inlining and re-transforming the
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; code.
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;
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; RUN: opt < %s -passes='cgscc(inline,function(sroa,instcombine))' -S | FileCheck %s
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; The `test1_*` collection of functions form a directly cycling pattern.
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define void @test1_a(i8** %ptr) {
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; CHECK-LABEL: define void @test1_a(
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entry:
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call void @test1_b(i8* bitcast (void (i8*, i1, i32)* @test1_b to i8*), i1 false, i32 0)
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; Inlining and simplifying this call will reliably produce the exact same call,
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; over and over again. However, each inlining increments the count, and so we
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; expect this test case to stop after one round of inlining with a final
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; argument of '1'.
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; CHECK-NOT: call
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; CHECK: call void @test1_b(i8* bitcast (void (i8*, i1, i32)* @test1_b to i8*), i1 false, i32 1)
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; CHECK-NOT: call
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ret void
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}
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define void @test1_b(i8* %arg, i1 %flag, i32 %inline_count) {
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; CHECK-LABEL: define void @test1_b(
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entry:
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%a = alloca i8*
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store i8* %arg, i8** %a
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; This alloca and store should remain through any optimization.
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; CHECK: %[[A:.*]] = alloca
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; CHECK: store i8* %arg, i8** %[[A]]
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br i1 %flag, label %bb1, label %bb2
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bb1:
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call void @test1_a(i8** %a) noinline
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br label %bb2
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bb2:
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%cast = bitcast i8** %a to void (i8*, i1, i32)**
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%p = load void (i8*, i1, i32)*, void (i8*, i1, i32)** %cast
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%inline_count_inc = add i32 %inline_count, 1
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call void %p(i8* %arg, i1 %flag, i32 %inline_count_inc)
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; And we should continue to load and call indirectly through optimization.
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; CHECK: %[[CAST:.*]] = bitcast i8** %[[A]] to void (i8*, i1, i32)**
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; CHECK: %[[P:.*]] = load void (i8*, i1, i32)*, void (i8*, i1, i32)** %[[CAST]]
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; CHECK: call void %[[P]](
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ret void
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}
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define void @test2_a(i8** %ptr) {
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; CHECK-LABEL: define void @test2_a(
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entry:
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call void @test2_b(i8* bitcast (void (i8*, i8*, i1, i32)* @test2_b to i8*), i8* bitcast (void (i8*, i8*, i1, i32)* @test2_c to i8*), i1 false, i32 0)
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; Inlining and simplifying this call will reliably produce the exact same call,
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; but only after doing two rounds if inlining, first from @test2_b then
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; @test2_c. We check the exact number of inlining rounds before we cut off to
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; break the cycle by inspecting the last paramater that gets incremented with
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; each inlined function body.
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; CHECK-NOT: call
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; CHECK: call void @test2_b(i8* bitcast (void (i8*, i8*, i1, i32)* @test2_b to i8*), i8* bitcast (void (i8*, i8*, i1, i32)* @test2_c to i8*), i1 false, i32 2)
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; CHECK-NOT: call
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ret void
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}
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define void @test2_b(i8* %arg1, i8* %arg2, i1 %flag, i32 %inline_count) {
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; CHECK-LABEL: define void @test2_b(
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entry:
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%a = alloca i8*
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store i8* %arg2, i8** %a
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; This alloca and store should remain through any optimization.
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; CHECK: %[[A:.*]] = alloca
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; CHECK: store i8* %arg2, i8** %[[A]]
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br i1 %flag, label %bb1, label %bb2
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bb1:
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call void @test2_a(i8** %a) noinline
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br label %bb2
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bb2:
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%p = load i8*, i8** %a
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%cast = bitcast i8* %p to void (i8*, i8*, i1, i32)*
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%inline_count_inc = add i32 %inline_count, 1
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call void %cast(i8* %arg1, i8* %arg2, i1 %flag, i32 %inline_count_inc)
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; And we should continue to load and call indirectly through optimization.
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; CHECK: %[[CAST:.*]] = bitcast i8** %[[A]] to void (i8*, i8*, i1, i32)**
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; CHECK: %[[P:.*]] = load void (i8*, i8*, i1, i32)*, void (i8*, i8*, i1, i32)** %[[CAST]]
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; CHECK: call void %[[P]](
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ret void
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}
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define void @test2_c(i8* %arg1, i8* %arg2, i1 %flag, i32 %inline_count) {
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; CHECK-LABEL: define void @test2_c(
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entry:
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%a = alloca i8*
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store i8* %arg1, i8** %a
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; This alloca and store should remain through any optimization.
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; CHECK: %[[A:.*]] = alloca
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; CHECK: store i8* %arg1, i8** %[[A]]
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br i1 %flag, label %bb1, label %bb2
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bb1:
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call void @test2_a(i8** %a) noinline
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br label %bb2
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bb2:
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%p = load i8*, i8** %a
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%cast = bitcast i8* %p to void (i8*, i8*, i1, i32)*
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%inline_count_inc = add i32 %inline_count, 1
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call void %cast(i8* %arg1, i8* %arg2, i1 %flag, i32 %inline_count_inc)
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; And we should continue to load and call indirectly through optimization.
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; CHECK: %[[CAST:.*]] = bitcast i8** %[[A]] to void (i8*, i8*, i1, i32)**
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; CHECK: %[[P:.*]] = load void (i8*, i8*, i1, i32)*, void (i8*, i8*, i1, i32)** %[[CAST]]
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; CHECK: call void %[[P]](
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ret void
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}
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