test whole program
This commit is contained in:
@@ -7,13 +7,13 @@
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#include "malloc.h"
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// #define malloc MALLOCCHERI
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// #define free FREECHERI
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#define malloc MALLOCCHERI
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#define free FREECHERI
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int main(int argc, char* argv[] )
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{
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// Init alloc
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// INITREGULARALLOC(0);
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INITREGULARALLOC(0);
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// =====================================================================
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// Initialization & Command Line Read-In
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// =====================================================================
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@@ -1,3 +1,5 @@
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LD_PRELOAD=/home/akilan/Alloc-Test/Reverse/CHERI-Allocator/bin/libjemalloc.so pmcstat -d -w 1 -p l1d_tlb_rd -p l2d_tlb_rd -p l1d_tlb_refill -p cpu_cycles -p dtlb_walk -p stall_backend -p ll_cache_miss_rd -o XSCHERI-alloc.txt ./XSBench -s small > XSCHERI-alloc-cheri-out.txt
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LD_PRELOAD=/home/akilan/Alloc-Test/Reverse/CHERI-Allocator/bin/regularjemalloc.so pmcstat -d -w 1 -p l1d_tlb_rd -p l2d_tlb_rd -p l1d_tlb_refill -p cpu_cycles -p dtlb_walk -p stall_backend -p ll_cache_miss_rd -o XSCHERI-regular.txt ./XSBench -s small > XSCHERI-alloc-out.txt
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# LD_PRELOAD=/home/akilan/Alloc-Test/Reverse/CHERI-Allocator/bin/hugepage_alloc.so pmcstat -d -w 1 -p l1d_tlb_rd -p l2d_tlb_rd -p l1d_tlb_refill -p cpu_cycles -p dtlb_walk -p stall_backend -p ll_cache_miss_rd -o XSCHERI-hugepage.txt ./XSBench -s small > XSCHERI-hugepage-out.txt
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# LD_PRELOAD=/home/akilan/Alloc-Test/Reverse/CHERI-Allocator/bin/libjemalloc.so pmcstat -d -w 1 -p l1d_tlb_rd -p l2d_tlb_rd -p l1d_tlb_refill -p cpu_cycles -p dtlb_walk -p stall_backend -p ll_cache_miss_rd -o XSCHERI-alloc.txt ./XSBench -s small > XSCHERI-alloc-cheri-out.txt
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# LD_PRELOAD=/home/akilan/Alloc-Test/Reverse/CHERI-Allocator/bin/regularjemalloc.so pmcstat -d -w 1 -p l1d_tlb_rd -p l2d_tlb_rd -p l1d_tlb_refill -p cpu_cycles -p dtlb_walk -p stall_backend -p ll_cache_miss_rd -o XSCHERI-regular.txt ./XSBench -s small > XSCHERI-alloc-out.txt
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# LD_PRELOAD=/home/akilan/Alloc-Test/Reverse/CHERI-Allocator/bin/hugepage_alloc.so pmcstat -d -w 1 -p l1d_tlb_rd -p l2d_tlb_rd -p l1d_tlb_refill -p cpu_cycles -p dtlb_walk -p stall_backend -p ll_cache_miss_rd -o XSCHERI-hugepage.txt ./XSBench -s small > XSCHERI-hugepage-out.txt
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pmcstat -d -w 1 -p l1d_tlb_rd -p l2d_tlb_rd -p l1d_tlb_refill -p cpu_cycles -p dtlb_walk -p stall_backend -p ll_cache_miss_rd -o XSCHERI-hugepage.txt ./XSBench -s small > XSCHERI-hugepage-out.txt
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BIN
docs/EuroSys/Paper/diagram/benchmarks-group/Memaccess_size.png
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docs/EuroSys/Paper/diagram/benchmarks-group/Memaccess_size.png
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@@ -113,6 +113,10 @@
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\bibcite{IntelItanium}{{8}{2003}{{Cornea et~al.}}{{Cornea, Harrison, and Tang}}}
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\bibcite{Shadow_superpages}{{9}{2001}{{Park and Park}}{{}}}
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\bibcite{DirectSegment}{{10}{2013}{{Basu et~al.}}{{Basu, Gandhi, Chang, Hill, and Swift}}}
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\@writefile{lof}{\contentsline {figure}{\numberline {3}{\ignorespaces Memaccess percentage increase in wallclock run times}}{9}{figure.caption.6}\protected@file@percent }
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\newlabel{fig:Memaccess}{{3}{9}{Memaccess percentage increase in wallclock run times}{figure.caption.6}{}}
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\@writefile{toc}{\contentsline {section}{References}{9}{section*.8}\protected@file@percent }
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\bibcite{karakostas_redundant_2015}{{11}{}{{Karakostas et~al.}}{{Karakostas, Gandhi, Ayar, Cristal, Hill, {McKinley}, Nemirovsky, Swift, and Ünsal}}}
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\bibcite{chen_flexpointer_2023}{{12}{2023}{{Chen et~al.}}{{Chen, Tong, Yang, Yi, and Cheng}}}
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\bibcite{CheriABI}{{13}{2019}{{Davis et~al.}}{{Davis, Watson, Richardson, Neumann, Moore, Baldwin, Chisnall, Clarke, Filardo, Gudka, Joannou, Laurie, Markettos, Maste, Mazzinghi, Napierala, Norton, Roe, Sewell, Son, and Woodruff}}}
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@@ -132,7 +136,5 @@
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\begin{multicols}{2}
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\begin{subfigure}{\linewidth}
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\includegraphics[width=\linewidth]{diagram/benchmarks-group/large/bargraph-large-llcache.png}
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\caption{LL Cache Reads}
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\label{fig:ll-cache-rd}
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\end{subfigure}\par
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@@ -1254,7 +1254,12 @@ of its capability to handle memory more efficiently by leveraging huge pages.
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cost. thus, fewer walks are preferable. In the observed tests neither FAT allocator nor FAT allocator embedded inside Jemalloc
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demonstrated significant deviation from the baseline performance of 99\% lesser walks.
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This consistent behavior was noted across all benchmarks evaluated: Kmeans, Memaccess, Glibc, Richards, and Barnes.
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This outcome suggests that most translations were done at the L1 DTLB level.
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This indicates that almost all address translations were resolved directly at the L1 DTLB level
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without triggering expensive traversals through the page table. More generally, this finding
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demonstrates that both allocator designs make efficient use of the hardware translation system and
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maintain consistently low page walk overheads across a range of workloads.
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% This outcome suggests that most translations were done at the L1 DTLB level.
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% the memory allocation strategies employed by these allocators do substantially alter the frequency
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% of DTLB misses that necessitate page table walks within these specific workloads. Even for the Memaccess benchmark,
|
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@@ -1302,10 +1307,21 @@ of its capability to handle memory more efficiently by leveraging huge pages.
|
||||
\item Wall clock (Figure~\ref{fig:wallclock}): Wallclock time serves as the definitive metric for evaluating overall execution performance.
|
||||
When using the FAT allocator, glibc demonstrated the most significant improvement, with a 51\% reduction in wallclock
|
||||
runtime compared to the baseline allocator. This was followed by memaccess with a 34\% decrease, barnes with a 4\% reduction,
|
||||
and kmeans with a modest 1.8\% improvement. Conversely, Richards exhibited a slight increase of 1\% in runtime.
|
||||
and kmeans with a modest 1.8\% improvement.
|
||||
Richards exhibited a slight increase of 1\% in runtime.
|
||||
When the FAT allocator was integrated into Jemalloc, the performance impact varied. Glibc experienced a 16.2\% increase
|
||||
in wallclock time, while barnes showed a 7\% rise. Both Richards and kmeans maintained the same runtime as the baseline
|
||||
allocator, whereas memaccess recorded a 4\% reduction.
|
||||
allocator.
|
||||
In regards to memaccess (Figure~\ref{fig:Memaccess}) the comparative performance of two allocators FAT allocator embedded inside jemalloc
|
||||
(depicted by the solid blue line with circular markers) and FAT allocator (represented by the dashed orange line with square markers)
|
||||
across progressively increasing memory access iterations ranging from 500 to 64,000. The results indicate that the standalone FAT allocator
|
||||
exhibits superior performance at smaller memory sizes, maintaining an initial lead of approximately 0.78\% at size 500. However,
|
||||
its trajectory is characterised by minor fluctuations as memory size increases. Conversely, the jemalloc embedded allocator demonstrates
|
||||
a more consistent and steadily rising performance pattern. The annotated red values denote the performance differential between the two
|
||||
allocators. Although the FAT allocator retains an advantage in the lower ranges, this advantage progressively diminishes with increasing memory reads.
|
||||
Notably, at the largest tested size of 64,000, the difference marginally reverses (–0.07), with the jemalloc-embedded allocator slightly outperforming.
|
||||
Overall, the findings suggest that while the FAT allocator is more effective at smaller scales, the jemalloc embedded FAT allocator exhibits superior scalability
|
||||
and reliability across larger memory reads.
|
||||
|
||||
% Wallclock time provides the ultimate measure of overall execution performance, In terms of the FAT allocator GLibc
|
||||
% had a biggest difference of 51\% lesser wall clock run time than the baseline allocator, following this memaccess with a 34\% reduction
|
||||
@@ -1324,6 +1340,12 @@ of its capability to handle memory more efficiently by leveraging huge pages.
|
||||
% an overall application speedup, as the interplay of various factors determines the final performance.
|
||||
\end{itemize}
|
||||
|
||||
\begin{figure}[htbp]
|
||||
\includegraphics[width=\linewidth]{diagram/benchmarks-group/Memaccess_size.png}
|
||||
\caption{Memaccess percentage increase in wallclock run times}
|
||||
\label{fig:Memaccess}
|
||||
\end{figure}
|
||||
|
||||
A particularly striking observation is the significant reduction in data TLB walks,
|
||||
L2 data TLB reads and TLB refills-consistently which show a 90\% decrease across all
|
||||
benchmarks compared to Jemalloc. This improvement is due to the modified allocators
|
||||
|
||||
Reference in New Issue
Block a user