use MachineBasicBlocks. To do this, we traverse the Machine CFG instead of
the LLVM CFG, which is also *MUCH* more efficient by having fewer levels of
indirections and mappings.
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is only used by a cast, and the casted type is the same size as the original
allocation, it would eliminate the cast by folding it into the allocation.
Unfortunately, it was placing the new allocation instruction right before
the cast, which could pull (for example) alloca instructions into the body
of a function. This turns statically allocatable allocas into expensive
dynamically allocated allocas, which is bad bad bad.
This fixes the problem by placing the new allocation instruction at the same
place the old one was, duh. :)
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* Make contained ostream pointer, not reference
* Allow setting of that ostream via setStream()
class CachedWriter:
* setStream() in turn calls setStream() on the AssemblyWriter
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In InsertFPRegKills(), just check the MachineBasicBlock for successors
instead of its corresponding BasicBlock.
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Include SparcV9RegisterInfo.h.
Add a getRegisterInfo() accessor and SparcV9RegisterInfo instance, just like
on the X86 target.
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functions for now). This automatically turns on the printing of machine
registers using their own real names, instead of goofy things like %mreg(42),
and allows us to migrate code incrementally to the new interface as we see fit.
The register file description it uses is hand-written, so that the register
numbers will match the ones that the SparcV9 target already uses.
Perhaps someday we'll tablegen it.
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This prepares us to be able to de-virtualize and de-abstract it, and
take the register allocator bits out and move them into the register allocator
proper...
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documentation that this module needs to be made independent of the
register file description of the current target.
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because 1) the first instruction might not be a call site, and
2) CS and SF.Caller were not getting set to point to the new call site
anyway (resulting in a crash on e.g. call %llvm.memset).
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the Module. The default behavior keeps functionality as before: the chosen
function is the one that remains.
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loop. This eliminates the extra add from the previous case, but it's
not clear that this will be a performance win overall. Tommorows test
results will tell. :)
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over its USES. If it's dead it doesn't have any uses! :)
Thanks to the fabulous and mysterious Bill Wendling for pointing this out. :)
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Eventually it would be nice if CallGraph maintained an ilist of CallGraphNode's instead
of a vector of pointers to them, but today is not that day.
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of IntCC, FloatCC, and Special types.
Make SparcV9RegInfo::getRegClassIDOfRegType() return the right answer
if you ask for the class corresponding to SpecialRegType.
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the name of %fsr (as the comment in SparcV9RegClassInfo.h used to suggest)
you would walk off the end of the FloatCCRegName array.
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structure to being dynamically computed on demand. This makes updating
loop information MUCH easier.
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that the exit block of the loop becomes the new entry block of the function.
This was causing a verifier assertion on 252.eon.
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block. The primary motivation for doing this is that we can now unroll nested loops.
This makes a pretty big difference in some cases. For example, in 183.equake,
we are now beating the native compiler with the CBE, and we are a lot closer
with LLC.
I'm now going to play around a bit with the unroll factor and see what effect
it really has.
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limited. Even in it's extremely simple state (it can only *fully* unroll single
basic block loops that execute a constant number of times), it already helps improve
performance a LOT on some benchmarks, particularly with the native code generators.
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operations. This allows us to compile this testcase:
int main() {
int h = 1;
do h = 3 * h + 1; while (h <= 256);
printf("%d\n", h);
return 0;
}
into this:
int %main() {
entry:
call void %__main( )
%tmp.6 = call int (sbyte*, ...)* %printf( sbyte* getelementptr ([4 x sbyte]* %.str_1, long 0, long 0), int 364 ) ; <int> [#uses=0]
ret int 0
}
This testcase was taken directly from 256.bzip2, believe it or not.
This code is not as general as I would like. Next up is to refactor it
a bit to handle more cases.
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even if the loop is using expressions that we can't compute as a closed-form.
This allows us to calculate that this function always returns 55:
int test() {
double X;
int Count = 0;
for (X = 100; X > 1; X = sqrt(X), ++Count)
/*empty*/;
return Count;
}
And allows us to compute trip counts for loops like:
int h = 1;
do h = 3 * h + 1; while (h <= 256);
(which occurs in bzip2), and for this function, which occurs after inlining
and other optimizations:
int popcount()
{
int x = 666;
int result = 0;
while (x != 0) {
result = result + (x & 0x1);
x = x >> 1;
}
return result;
}
We still cannot compute the exit values of result or h in the two loops above,
which means we cannot delete the loop, but we are getting closer. Being able to
compute a constant trip count for these two loops will allow us to unroll them
completely though.
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that does not dominate all of its users, but is in the same basic block as
its users. This class of error is what caused the mysterious CBE only
failures last night.
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Basically we were using SimplifyCFG as a huge sledgehammer for a simple
optimization. Because simplifycfg does so many things, we can't use it
for this purpose.
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Instead of producing code like this:
Loop:
X = phi 0, X2
...
X2 = X + 1
if (X != N-1) goto Loop
We now generate code that looks like this:
Loop:
X = phi 0, X2
...
X2 = X + 1
if (X2 != N) goto Loop
This has two big advantages:
1. The trip count of the loop is now explicit in the code, allowing
the direct implementation of Loop::getTripCount()
2. This reduces register pressure in the loop, and allows X and X2 to be
put into the same register.
As a consequence of the second point, the code we generate for loops went
from:
.LBB2: # no_exit.1
...
mov %EDI, %ESI
inc %EDI
cmp %ESI, 2
mov %ESI, %EDI
jne .LBB2 # PC rel: no_exit.1
To:
.LBB2: # no_exit.1
...
inc %ESI
cmp %ESI, 3
jne .LBB2 # PC rel: no_exit.1
... which has two fewer moves, and uses one less register.
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