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8/4/2019 Virtual Memory Lee
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ECE3055ECE3055
Computer Architecture andComputer Architecture and
Operating SystemsOperating Systems
Lecture: Memory Subsystem (II)Lecture: Memory Subsystem (II)
OS PerspectiveOS Perspective
Prof. HsienProf. Hsien--Hsin Sean LeeHsin Sean Lee
School of Electrical and Computer EngineeringSchool of Electrical and Computer Engineering
Georgia Institute of TechnologyGeorgia Institute of Technology
BackgroundBackground
Program must be brought into memory and placed
within a process for it to be run
Input queue collection of processes on the disk that
are waiting to be brought into memory to run the
program
User programs go through several steps before being
run
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Binding of Instructions and Data to MemoryBinding of Instructions and Data to Memory
Compile time: If memory location known a
priori, absolute code can be generated; must
recompile code if starting location changes
Load time: Must generate relocatable code if
memory location is not known at compile time
Execution time: Binding delayed until run
time if the process can be moved during its
execution from one memory segment to
another. Need hardware support for addressmaps (e.g., base and limit registers).
Address binding of instructions and data to memory addresses can
happen at three different stages
MultiMulti--step Processing of a User Programstep Processing of a User Program
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Virtual vs. Physical Address SpaceVirtual vs. Physical Address Space
The concept of a virtual (or logical) address space that
is bound to a separatephysical address space iscentral to proper memory management
Virtual address generated by the CPU; also referred to as
virtual address
Physical address address seen by the memory unit
Virtual and physical addresses are the same in
compile-time and load-time address-binding schemes;
virtual and physical addresses differ in execution-time
address-binding scheme
Virtual MemoryVirtual Memory
Virtual memory separation of user logical memory
from physical memory.
Only part of the program needs to be in memory for
execution.
Logical address space can therefore be much larger than
physical address space.
Allows address spaces to be shared by several processes.
Allows for more efficient process creation.
Virtual memory can be implemented via:
Demand paging
Demand segmentation
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Virtual Address SpaceVirtual Address Space
Other Uses of Virtual MemoryOther Uses of Virtual Memory
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Virtual Memory Larger than PhysicalVirtual Memory Larger than Physical
Schematic View of SwappingSchematic View of Swapping
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PagingPaging
Virtual address space of a process can be non-contiguous in
physical address space; process is allocated physical memorywhenever the latter is available
Divide physical memory into fixed-sized blocks called frames (size
is power of 2, between 512 bytes and 8192 bytes)
Divide logical memory into blocks of same size called pages.
Keep track of all free frames
To run a program of size n pages, need to find n free frames and
load program
OS sets up apage tablepage table to translate virtual to physical addresses
Internal fragmentation
VirtualVirtual--toto--Physical Address TranslationPhysical Address Translation
Address generated by CPU is divided into:
Page number (p) used as an index into apage table which
contains base address of each page in physical memory
Page offset (d) combined with base address to define the
physical memory address that is sent to the memory unit
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Transfer of a Paged Memory toTransfer of a Paged Memory to
Contiguous Disk SpaceContiguous Disk Space
Paging ExamplePaging Example
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Paging ExamplePaging Example
Demand PagingDemand Paging
Bring a page into memory only when it is needed
Less I/O needed
Less memory needed
Faster response
More users
Page is needed reference to it invalid reference abort
not-in-memory bring to memory
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Address Translation: Page TableAddress Translation: Page Table
With each page table entry a validinvalid bit is associated(1 in-memory, 0 not-in-memory)
Initially validinvalid but is set to 0 on all entries Example of a page table snapshot:
During address translation, if validinvalid bit in page tableentry is 0 page faultpage fault
1
1
1
1
0
0
0
M
Frame # valid-invalid bit
page tablepage table
Free FramesFree Frames
Before allocation After allocation
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Address Translation ArchitectureAddress Translation Architecture
Page Table When Some Pages ArePage Table When Some Pages AreNot in Main MemoryNot in Main Memory
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Page FaultPage Fault
If there is ever a reference to a page, first reference will trap to
OS page fault OS looks at another table to decide:
Invalid reference abort.
Just not in memory.
Get empty frame.
Swap page into frame.
Reset tables, validation bit = 1.
Restart instruction: Least Recently Used
block move
auto increment/decrement location
Handling Page FaultHandling Page Fault
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What happens if there is no free frame?What happens if there is no free frame?
Page replacement find some page in memory, but
not really in use, swap it out algorithm
performance want an algorithm which will result in
minimum number of page faults
Same page may be brought into memory several
times
Page Table SizePage Table Size
Not all programs will use the entire available address
range
Wasteful to create a page table for every page in the
address range
Page table is in main memory, some systems
provide the following to indicate the size of the page
table for faster checking page table base registerpage table base register
page table length registerpage table length register
However, the size of a linear page table can be still
overwhelmingly large
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Page Table StructurePage Table Structure
Multi-level Paging
Hashed Page Tables
Inverted Page Tables
MultiMulti--Level (Hierarchical) Page TableLevel (Hierarchical) Page Table
Break up the virtual address space into multiple page
tables
Increase the utilization and reduce the physical size of
a page table
A simple technique is a two-level page table
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TwoTwo--Level Paging ExampleLevel Paging Example
A logical address (on 32-bit machine with 4K page size)
is divided into: a page number consisting of 20 bits
a page offset consisting of 12 bits
Since the page table is paged, the page number isfurther divided into:
a 10-bit page number
a 10-bit page offset
Thus, a logical address is as follows:
wherepi is an index into the outer page table, andp2 isthe displacement within the page of the outer page table
page number page offset
pi p2 d
10 10 12
TwoTwo--Level PageLevel Page--Table SchemeTable Scheme
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AddressAddress--Translation SchemeTranslation Scheme
Address-translation scheme for a two-level 32-bit
paging architecture
Hashed Page TableHashed Page Table
Common in address spaces > 32 bits
The virtual page number is hashed into a page table.
This page table contains a chain of elements hashing
to the same location.
Virtual page numbers are compared in this chain
searching for a match. If a match is found, the
corresponding physical frame is extracted.
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Hashed Page TableHashed Page Table
Inverted Page TableInverted Page Table
One entry for each real page of memory
Shared by all active processes
Entry consists of the virtual address of the page
stored in that real memory location, with PID
information
Decreases memory needed to store each page table,
but increases time needed to search the table when a
page reference occurs
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Inverted Page Table ArchitectureInverted Page Table Architecture
Linear Inverted Page TableLinear Inverted Page Table
Contain entries (size of physical memory) in a linear array
Need to traverse the array sequentially to find a match
Can be time consuming
PID VPNOffsetVPN = 0x2AA70
1 0x74094
12 0xFEA001 0x00023
8 0x2AA70
.. . . . . . .
PID = 8
Linear Inverted Page Table
PPNIndex
0
12
0x120C
.. . . . . .
0x120D14 0x2409A
match
OffsetPPN = 0x120D
Physical Address
Virtual Address
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Hashed Inverted Page TableHashed Inverted Page Table
Use hash table to limit the search to smaller number
of page-table entries
OffsetVPN = 0x2AA70PID = 8
Virtual Address
Hash PID VPN
1 0x74094
12 0xFEA00
1 0x00023
8 0x2AA70
.. . . . . . .
0
1
2
0x120C
.. . . . . .
0x120D14 0x2409A
0x0012
Next
---
0x120D
0x00A00x0980
. . . .
. . . .match
Implementation of Page TableImplementation of Page Table
Page table is kept in main memory
Page-table base register (PTBR) points to the start of
the page table
Page-table length register(PRLR) indicates size of
the page table
In this scheme every data/instruction access requires
two memory accesses. One for the page table and
one for the data/instruction.
The two memory access problem can be solved by
the use of a special fast-lookup hardware cache called
associative memory ortranslation look-aside
buffers (TLBs)
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Associative MemoryAssociative Memory
Associative memory parallel search
Address translation (A, A)
If A is in associative register, get frame # out
Otherwise get frame # from page table in memory
Page # Frame #
Paging Hardware With TLBPaging Hardware With TLB
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Effective Access TimeEffective Access Time
Associative Lookup = time unit
Assume memory cycle time is 1 microsecond
Hit ratio percentage of times that a page number is
found in the associative registers; ratio related to
number of associative registers
Hit ratio =
Effective Access Time (EAT)
EAT = (1 + ) + (2 + )(1 )
= 2 +
Memory ProtectionMemory Protection
Memory protection implemented by associating
protection bit with each frame
Valid-invalid bit attached to each entry in the page
table:
valid indicates that the associated page is in the process
logical address space, and is thus a legal page invalid indicates that the page is not in the process logical
address space
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Shared PagesShared Pages
Shared code
One copy of read-only (reentrant) code shared amongprocesses (i.e., text editors, compilers, window systems).
Shared code must appear in same location in the logical
address space of all processes
Private code and data
Each process keeps a separate copy of the code and data
The pages for the private code and data can appear
anywhere in the logical address space
Shared Pages ExampleShared Pages Example
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SegmentationSegmentation
Memory-management scheme that supports user
view of memory A program is a collection of segments. A segment is
a logical unit such as:
main program,
procedure,
function,
method,
object,
local variables, global variables,
common block,stack,
symbol table, arrays
UserUsers View of a Programs View of a Program
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Logical View of SegmentationLogical View of Segmentation
1
3
2
4
1
4
2
3
user space physical memory space
Segmentation ArchitectureSegmentation Architecture
Logical address consists of a two tuple:
,
Segment table maps two-dimensional physical
addresses; each table entry has:
base contains the starting physical address where the
segments reside in memory
limit specifies the length of the segment
Segment-table base register (STBR) points to the
segment tables location in memory
Segment-table length register (STLR) indicates
number of segments used by a program;
segment numbers is legal ifs < STLR
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Segmentation Architecture (Cont.)Segmentation Architecture (Cont.)
Relocation.
dynamic
by segment table
Sharing.
shared segments
same segment number
Allocation.
first fit/best fit
external fragmentation
Segmentation Architecture (Cont.)Segmentation Architecture (Cont.)
Protection. With each entry in segment table
associate:
validation bit = 0 illegal segment
read/write/execute privileges
Protection bits associated with segments; code
sharing occurs at segment level
Since segments vary in length, memory allocation is adynamic storage-allocation problem
A segmentation example is shown in the following
diagram
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Segmentation HardwareSegmentation Hardware
Example of SegmentationExample of Segmentation
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Sharing of SegmentsSharing of Segments
Segmentation with PagingSegmentation with Paging MULTICSMULTICS
The MULTICS system solved problems of external
fragmentation and lengthy search times by paging the
segments
Solution differs from pure segmentation in that the
segment-table entry contains not the base address of
the segment, but rather the base address of apagetable for this segment
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MULTICS Address TranslationMULTICS Address Translation
SchemeScheme
Segmentation with PagingSegmentation with Paging Intel x86Intel x86
As shown in the following diagram, the Intel x86uses segmentation with paging for memorymanagement with a two-level paging scheme
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Intel 30386 Address TranslationIntel 30386 Address Translation
Linux on Intel 80x86Linux on Intel 80x86
Uses minimal segmentation to keep memory
management implementation more portable
Uses 6 segments:
Kernel code
Kernel data
User code (shared by all user processes, using logical
addresses) User data (likewise shared)
Task-state (per-process hardware context)
LDT
Uses 2 protection levels:
Kernel mode
User mode