Virtual Memory and
Address Translation
1
Review
Program addresses are virtual addresses.
¾ Relative offset of program regions can not change during program execution. E.g., heap can not move further from code.g p
¾ Virtual addresses == physical address inconvenient. Program location is compiled into the program.
A single offset register allows the OS to place a process’ virtual address space anywhere in physical memory.
¾ Virtual address space must be smaller than physical.
¾ Program is swapped out of old location and swapped into new. Segmentation creates external fragmentation and requires large
2
g g q g
regions of contiguous physical memory.
Virtual Memory
Concept
Key problem: How can one support programs that require more memory than is physically available?
¾ How can we support programs that do not use all of their memory at once?
2
n-1
Hide physical size of memory from users
¾ Memory is a “large” virtual address spaceof 2n bytes
¾ Only portions of VAS are in physical memory at any one time (increase memory utilization).
Issues
¾ Placement strategies
Where to place programs in physical memory
Program
P
’s
VAS
3 ¾ Replacement strategies
What to do when there exist more processes than can fit in memory
¾ Load control strategies
Determining how many processes can be in memory at one time
0
Realizing Virtual Memory
Paging
Physical memory partitioned into equal sized
page frames
¾ Page frames avoid external fragmentation.
(fMAX-1,oMAX-1) g g (f,o)
o
Physical
Memory
A memory address is a pair (f, o) f — frame number (fmaxframes)
o — frame offset (omax bytes/frames) Physical address = omax×f +o
4 (0,0)
PA:
f
o
f
1 log2omax log2(fmax ×omax)Physical Address Specifications
Frame/Offset pair v. An absolute index
Example: A 16-bit address space with (omax=) 512 byte page frames
¾ Addressing location (3, 6) = 1,542 (3,6) 1,542
0
1 9PA:
16 (3,6)f
o
Physical
Memory
1
1
1
0
0
0
0
0
0 1
0
0
0
0
0
3
6
10 1,542 5 (0,0)f
1,542
0Questions
The offset is the same in a virtual address and a
physical address.
¾A T ¾A. True ¾B. False
If your level 1 data cache is equal to or smaller than
2
number of page offsetbits then address translation is not
necessary for a data cache tag check.
¾A. True ¾B False
6 ¾B. False
Realizing Virtual Memory
Paging
A process’s virtual address space is partitioned into equal sized pages
¾ page = page frame
2n-1 = (pMAX-1,oMAX-1)
¾ page = page frame
(p,o)
o
Virtual
Address
Space
A virtual address is a pair (p, o) p — page number (pmaxpages) o — page offset (omaxbytes/pages)
Virtual address = omax×p +o
7 (0,0)
p
o
p
VA:
1 log2oMAXlog2(pmax×omax)
Paging
Mapping virtual addresses to physical addresses
Pagesmap to frames
Pages are contiguous in a VAS...
¾ But pages are arbitrarily located
i h i l d
Virtual
in physical memory, and¾ Not all pages mapped at all times
Virtual
Address
Space
(p2,o2)Physical
Memory
(f1,o1) 8 (p1,o1) (f2,o2)Frames and pages
Only mapping virtual pages that are in use does
what?
¾A. Increases memory utilization. ¾A. Increases memory utilization.
¾B. Increases performance for user applications. ¾C. Allows an OS to run more programs concurrently.
¾D. Gives the OS freedom to move virtual pages in the virtual address space.
Address translation is
¾A. Frequent
9 ¾B. Infrequent
Changing address mappings is
¾A. Frequent ¾B. Infrequent
Paging
Virtual address translation
A page tablemaps virtual
pages to physical frames (f,o)
Program P CPU P’s Virtual Address Space Physical Memory 1 20 109 p o 1 16109 f o Virtual Add 10 Page Table (p,o)
p
Physical Addresses Addressesf
Virtual Address Translation Details
Page table structure
Contents:
¾ Flags — dirty bit, resident bit, clock/reference bit
¾ Frame number 1 table per process
Part of process’s state
1 20 109 p o 1 16109 f o Virtual CPU 11 1 0 Page Table
p
Physical Addresses Addressesf
0 PTBR +Virtual Address Translation Details
Example
A system with 16-bit addresses ¾ 32 KB of physical memory ¾ 1024 byte pages (4,1023) (4,0) CPU Physical Memory 15 p o 14 109 f o Physical Addresses Virtual Add P’s Virtual Address Space (3,1023) (4,0) 0 0 10 9 12 1 1 0 0 1 0 0 Page Table Addresses 0 0 0 0 0 0 0 (0,0) 1 0
Virtual Address Translation
Performance Issues
Problem — VM reference requires 2 memory references!
¾ One access to get the page table entry
¾ One access to get the data
Page table can be very large; a part of the page table can be on disk.
¾ For a machine with 64-bit addresses and 1024 byte pages, what is the size of a page table?
What to do?
¾ Most computing problems are solved by some form of…
13 Caching
Indirection
Virtual Address Translation
Using TLBs to Speedup Address Translation
Cache recently accessed page-to-frame translations in a TLB ¾ For TLB hit, physical page number obtained in 1 cycle
¾ For TLB miss, translation is updated in TLB
¾ Has high hit ratio (why?)
f 1 20 109 p o 1 16109 f o Physical Addresses Virtual Addresses CPU Key Value ? 14 Page Table TLB f Key Value p p f
X
Dealing With Large Page Tables
Multi-level paging
Add additional levels of indirection to the page table by sub-dividing page number into kparts
¾ Create a “tree” of page tables
¾ TLB still used, just not shown Second-Level Page Tables
¾ The architecture determines the number of levels of page table
p
2o
Virtual Addressp
3 Page Tablesp
1p
2 15 Third-Level Page Tables First-Level Page Tablep
1p
3Dealing With Large Page Tables
Multi-level paging
Example: Two-level paging
CPU Memory 1 20 16 10
p
1o
1 16 10f
o
Physical Addresses Virtual Addresses CPUp
2 Memory 16 Second-Level Page Table First-Level Page Table page tablep
2 fp
1 PTBR + +The Problem of Large Address Spaces
With large address spaces (64-bits) forward mapped page tables become cumbersome.
¾ E.g. 5 levels of tables.g
Instead of making tables proportional to size of virtual address space, make them proportional to the size of physical address space.
¾ Virtual address space is growing faster than physical.
Use one entry for each physical page with a hash table
17 Use one entry for each physical page with a hash table
¾ Size of translation table occupies a very small fraction of physical memory
¾ Size of translation table is independent of VM size
Virtual Address Translation
Using Page Registers (aka Inverted Page Tables)
Each frame is associated with a register containing
¾ Residence bit: whether or not the frame is occupied
¾ Occupier: page number of the page occupying frame
¾ Occupier: page number of the page occupying frame
¾ Protection bits
Page registers: an example
¾ Physical memory size: 16 MB
¾ Page size: 4096 bytes
¾ Number of frames: 4096
¾ Space used for page registers (assuming 8 bytes/register): 32
18
¾ Space used for page registers (assuming 8 bytes/register): 32 Kbytes
¾ Percentage overhead introduced by page registers: 0.2%
Page Registers
How does a virtual address become a physical address?
CPU generates virtual addresses, where is the
physical page?
¾H h th i t l dd ¾Hash the virtual address ¾Must deal with conflicts
TLB caches recent translations, so page lookup can
take several steps
¾Hash the address
¾Check the tag of the entry
¾Possibly rehash/traverse list of conflicting entries
19 ¾Possibly rehash/traverse list of conflicting entries
TLB is limited in size
¾Difficult to make large and accessible in a single cycle. ¾They consume a lot of power (27% of on-chip for
StrongARM)
Dealing With Large Inverted Page Tables
Using Hash Tables
Hash page numbers to find corresponding frame number
¾ Page frame number is not explicitly stored (1 frame per entry)
¾ Protection, dirty, used, resident bits also in entry
1 20 9 p o 1 16 9 f o Physical Addresses Virtual Address CPU Hash Memory g running PID =? =? =?=? tag check 20
h
(
PID
,
p
)
PTBRPID
Inverted Page Table 1 0
page
0 fmax– 1 fmax– 2 + 1Searching Inverted Page Tables
Using Hash Tables
Page registers are placed in an array
Page
i
is placed in slot
f(i) where f
is an agreed-upon
hash function
To lookup page
i
, perform the following
:
¾Compute f(i)and use it as an index into the table of page registers
21 ¾Extract the corresponding page register
¾Check if the register tag contains i,if so, we have a hit ¾Otherwise, we have a miss
Searching the Inverted Page Table
Using Hash Tables (Cont’d.)
Minor complication
¾ Since the number of pages is usually larger than the number of slots in a hash table, two or more items mayhash to the same l ti
location
Two different entries that map to same location are said to collide
Many standard techniques for dealing with collisions
¾ Use a linked list of items that hash to a particular table entry
¾ Rehash index until the key is found or an empty table entry is
22
¾ Rehash index until the key is found or an empty table entry is reached (open hashing)
Questions
Why use inverted page tables?
¾A. Forward mapped page tables are too slow.
¾B F d d t bl d ’t l t l i t l
¾B. Forward mapped page tables don’t scale to larger virtual address spaces.
¾C. Inverted pages tables have a simpler lookup algorithm, so the hardware that implements them is simpler.
¾D. Inverted page tables allow a virtual page to be anywhere in physical memory.
23
Virtual Memory (Paging)
The bigger picture
A process’s VAS is its context ¾ Contains its code, data, and stack
Code pages are stored in a user’s file on disk
Code Data Stack Code pages are stored in a user s file on disk
¾ Some are currently residing in memory; most are not
Data and stack pages are also stored in a file ¾ Although this file is typically not visible to users
¾ File only exists while a program is executing
OS determines which portions of a process’s VAS
d i t ti
File System (Disk)
24 are mapped in memory at any one time
OS/MMU
Physical Memory
Virtual Memory
Page fault handling
References to non-mapped pages generate a page fault CPU Physical Memory P CPU Page Table 0
OS resumes/initiates some other process Read of page completes
Page fault handling steps:
Processor runs the interrupt handler OS blocks the running process OS starts read of the unmapped page
25 Program
P’s VAS
Disk OS maps the missing page into memory
OS restart the faulting process
Virtual Memory Performance
Page fault handling analysis
To understand the overhead of paging, compute the effective memory access time(EAT)
¾ EAT = memory access time×probability of a page hit + page fault service time×probability of a page fault
Example:
¾ Memory access time: 60 ns
¾ Disk access time: 25 ms
¾ Let p= the probability of a page fault
¾ EAT =60(1–p) +25,000,000p
26
( p) , , p
To realize an EAT within 5% of minimum, what is the largest value of pwe can tolerate?
Vista reading from the pagefile
27
Vista writing to the pagefile
Virtual Memory
Summary
Physical and virtual memory partitioned into equal
size units
Size of VAS unrelated to size of physical memory
Virtual
pages
are mapped to physical
frames
Simple placement strategy
There is no external fragmentation
29
g
Key to good performance is minimizing page faults
Segmentation vs. Paging
Segmentation has what advantages over paging?
¾A. Fine-grained protection.
¾B E i t t f f t t /f th di k
¾B. Easier to manage transfer of segments to/from the disk. ¾C. Requires less hardware support
¾D. No external fragmentation
Paging has what advantages over segmentation?
¾A. Fine-grained protection.
¾B. Easier to manage transfer of pages to/from the disk. ¾C Requires less hardware support
30 ¾C. Requires less hardware support.
