Transcript Lecture15

Advanced Operating Systems - Spring 2009
Lecture 17 – March 16, 2009
 Dan C. Marinescu
 Email: [email protected]
 Office: HEC 439 B.
 Office hours: M, Wd 3 – 4:30 PM.
 TA: Chen Yu
 Email: [email protected]
 Office: HEC 354.
 Office hours: M, Wd 1.00 – 3:00 PM.
1
Last, Current, Next Lecture
 Last time:
 M/M/m systems
 Scheduling Algorithms
 Today
 Memory management
 Next time:
 Caching and Virtual Memory
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Scheduling algorithms
 A scheduling problems is defined by
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( ,  , : )
( ) The machine environment
(  ) A set of side constrains and characteristics
( ) The optimality criterion
 Machine environments:
 1  One-machine.
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P  Parallel identical machines
Q  Parallel machines of different speeds
R  Parallel unrelated machines
O  Open shop. m specialized machines; a job requires a number of
operations each demanding processing by a specific machine
F  Floor shop
One-machine environment
 n jobs 1,2,….n.
 pj amount of time required by job j.
 rj  the release time of job j, the time when job j is
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available for processing.
wj  the weight of job j.
dj due time of job j; time job j should be completed.
A schedule S specifies for each job j which pj units of time
are used to process the job.
CSj  the completion time of job j under schedule S.
CSmax = max CSj 1 n
S
C
 The average completion time is

j
n j 1
 The makespan of S is:
One-machine environment (cont’d)
n
S
w
C
 j j
 Average weighted completion time:
 Optimality criteria  minimize:
 the makespan CSmax
j 1
n
S
C
 the average completion time :  j
j 1
 The average weighted completion time:
n
S
w
C
 j j
j 1
 L j  C  d j  the lateness of job j
n
S
 Lmax  max j 1 L j maximum lateness of any job
under schedule S. Another optimality criteria,
S
j
minimize maximum lateness.
Priority rules for one machine environment
 Theorem: scheduling jobs according to SPT – shortest processing time is
optimal for 1 ||  C j
 Theorem: scheduling jobs in non-decreasing order of
is optimal for 1 ||  w j C j
wj
pj
Earliest deadline first (EDF)
 Dynamic scheduling algorithm for real-time OS.
 When a scheduling event occurs (task finishes, new task
released, etc.) the priority queue will be searched for the
process closest to its deadline. This process will then be
scheduled for execution next.
 EDF is an optimal scheduling preemptive algorithm for
uniprocessors, in the following sense: if a collection of
independent jobs, each characterized by an arrival time, an
execution requirement, and a deadline, can be scheduled
(by any algorithm) such that all the jobs complete by their
deadlines, the EDF will schedule this collection of jobs such
that they all complete by their deadlines.
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EDF
The schedulability test for EDF is:
n
U 
j 1
Process
Execution Time
dj
1
pj
Period
P1
1
8
P2
2
5
P3
4
10
In this case U = 1/8 +2/5 + 4/10 = 0.925 = 92.5%
It has been proved that the problem of deciding if it is
possible to schedule a set of periodic processes is NPhard if the periodic processes use semaphores to enforce
mutual exclusion.
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Priority Inversion
 A high priority process is blocked by a lower priority one.
 Example: J1 and J3 share a data structure guarded by a
binary semaphore S.
 prty(J1) > prty(J2) > prty(J3).
 J1 in initiated while J3 is in its critical section
 When J1 attempts to enter the critical section it is blocked.
 The duration of this blocking cannot be determined as
because J3 can be preempted by a higher priority job J2. prty
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Memory Management
 Architectural background
 Swapping
 Contiguous memory allocation
 Paging
 Segmentation
 Case studies:
 The Intel Pentium
 Linux
Multistep Processing of a User Program
Architectural background
 Program must be brought (from disk) into memory
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and placed within a process for it to be run
CPU can access directly only Main memory and
registers.
Register access in one CPU clock (or less)
Main memory can take many cycles
Cache sits between main memory and CPU
registers
Base and limit Registers delimit logical address space
 Base register  start of logical address space
 Limit register  end of logical address space
Address binding of instructions and data to
memory addresses
 Absolute code  Object code in a form suitable for direct execution.
 Relocatable code  Object code that can be run from any memory location.
 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 address maps (e.g., base and limit registers)
Logical vs. Physical Address Space
 Address space a range of discrete addresses; may correspond to a
physical or virtual memory register, a network host, disk sector or other
logical or physical entity.
 Virtualization of addressing
 Logical (virtual) address  generated by the CPU
 Physical address  address seen by the memory unit
 A user program deals with logical addresses; it never sees the real
physical addresses.
 Logical and physical addresses
 are the same in compile-time and load-time address-binding schemes
 differ in execution-time address-binding scheme
Memory-Management Unit (MMU)
 Hardware device that maps virtual to physical
address
 In MMU scheme, the value in the relocation register
is added to every address generated by a user process
at the time it is sent to memory
Dynamic relocation with a relocation register
Dynamic Loading
 Routine is not loaded until it is called
 Better memory-space utilization; unused routine is never
loaded
 Useful when large amounts of code are needed to handle
infrequently occurring cases
 No special support from the operating system required;
implemented through program design
Dynamic linking
 Linking postponed until execution time. A stub is
used to locate the appropriate memory-resident
library routine. Particularly useful for libraries; also
known as shared libraries
 Stub replaces itself with the address of the routine,
and executes the routine
 Operating system needed to check if routine is in
processes’ memory address.
Swapping
 Backing store  fast disk providing direct access to copies of all
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memory images for all processes in the system.
Swap out A process moved temporarily out of memory to a backing
store.
Swap in  The process is brought into memory for continued
execution.
Roll out, roll in  swapping variant used for priority-based scheduling
algorithms; lower-priority process is swapped out so higher-priority
process can be loaded and executed.
Swap time  time to transfer the process, proportional to amount of
memory swapped.
Ready queue  queue of processes which have memory images on
disk and are ready to run. Maintained by the operating system.
 Versions of swapping found in UNIX, Linux, and Windows.
Swapping
Contiguous Allocation
 Main memory usually into two partitions:
 Resident operating system, usually held in low memory
with interrupt vector
 User processes then held in high memory
 Relocation registers used to protect user processes
from each other, and from changing operatingsystem code and data
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Base register contains value of smallest physical
address
Limit register contains range of logical addresses –
each logical address must be less than the limit
register
MMU maps logical address dynamically
HW address protection with base and limit registers
Multiple-partition contiguous allocation
 Hole  block of available memory; holes of various size
are scattered throughout memory
 When a process is loaded  it is allocated memory from
a hole large enough to accommodate it
 Operating system maintains information about:
a) allocated partitions b) free partitions (hole)
OS
OS
OS
OS
process 5
process 5
process 5
process 5
process 9
process 9
process 8
process 2
process 10
process 2
process 2
process 2
Dynamic storage allocation
How to satisfy a request of size n from a list of free holes
 First-fit  Allocate the first hole that is big enough
 Best-fit  Allocate the smallest hole that is big
enough; must search entire list, unless ordered by
size. Produces the smallest leftover hole
 Worst-fit  Allocate the largest hole; must also
search entire list . Produces the largest leftover hole
First-fit and best-fit better than worst-fit in terms of
speed and storage utilization
Fragmentation
 External Fragmentation  total memory space exists to satisfy a
request, but it is not contiguous
 Internal Fragmentation  allocated memory may be slightly larger
than requested memory; this size difference is memory internal to a
partition, but not being used
 Compaction  Reduces external fragmentation:
 How  it shuffle memory contents to place all free memory together in
one large block
 Limits  possible only if relocation is dynamic, done at execution time
 I/O problem
 Latch job in memory while it is involved in I/O
 Do I/O only into OS buffers
Noncontiguous logical address space Paging
 Frames  blocks of physical memory of fixed-size (512 - 8,192 bytes)
 Pages  blocks of logical memory of same size.
 What the memory management must do:
 Keep track of all free frames
 To run a program of n pages find n free frames and load program
Set up a page table to translate logical to physical addresses
 Address internal fragmentation
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Dynamic address translation (DAT)
 Address generated by CPU is divided into:
 Page number (p) – used as an index into a page table
which contains base address of each page in physical
memory
page number
page offset
p
d
m-n
n
 Page offset (d) – combined with base address to
define the physical memory address that is sent to the
memory unit.
Paging Hardware
Mapping logical to physical memory
Example
32-byte memory and 4-byte pages
Free Frames
Before allocation
After allocation
Page Table
 Page table is kept in main memory.
 Page-table base register (PTBR)  points to 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.
 Translation look-aside buffers (TLBs)  special fast-lookup hardware
cache called associative memory. Helps solve the two memory access
problem can be solved by the use of a or
 Some TLBs store address-space identifiers (ASIDs) in each TLB entry –
uniquely identifies each process to provide address-space protection
for that process.
Associative Memory
 Associative memory – parallel search
Page #
Frame #
Address translation (p, d)
 If p is in associative register, get frame # out
 Otherwise get frame # from page table in memory
Dynamic address translation with TLB
Effective Access Time
 Associative Lookup =  time unit
 Assume memory cycle time is 1 microsecond
 Hit ratio  percentage of times that a page is found in TLB
 Hit ratio = 
 Effective Access Time (EAT)
EAT = (1 + )  + (2 + )(1 – )
=2+–
Memory Protection
 Memory protection  protection bit for each frame
 Valid-invalid bit attached to each entry in the page table:
 valid  legal page; the page is in the process’ logical address space.
 invalid  the page is not in the process’ logical address space
Shared Pages
 Shared code
 One copy of read-only (reentrant) code shared among processes (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
Example
Structure of the Page Table
 Hierarchical Paging
 Hashed Page Tables
 Inverted Page Tables
Hierarchical Page Tables
 Break up the logical address space into multiple page tables
 A simple technique is a two-level page table
Example
 A logical address (on 32-bit machine with 1K page size) is divided into:
 a page number consisting of 22 bits
 a page offset consisting of 10 bits
 Since the page table is paged, the page number is further divided into:
 a 12-bit page number
 a 10-bit page offset
 Thus, a logical address is as follows:
page number
pi
12
page offset
p2
d
10
10
 where pi is an index into the outer page table, and p2 is the displacement
within the page of the outer page table
DAT with a two level page table scheme
Three-level Paging Scheme
Hashed Page Tables
 Common when logical 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.
Inverted Page Table
 One entry for each real page of memory
 Entry consists of the virtual address of the page stored in that
real memory location and the process that owns that page.
 Decreases memory needed to store each page table.
 Increases time needed to search the table.
 Use hash table to limit the search to one — or at most a few
— page-table entries
Inverted Page Table
Segmentation
 Memory-management scheme that supports user view of memory.
 Program  collection of segments.
 Segment  logical unit such as:
main program,
procedure,
function,
method,
object,
local variables,
global variables,
common block,
stack,
symbol table,
arrays
Logical View of Segmentation
1
4
1
2
3
4
2
3
user space
physical memory space
Segmentation Architecture
 Logical address  <segment-number, offset>,
 Segment table  maps two-dimensional physical
addresses; each table entry has:
 base  the starting physical address of the segment
 limit  the length of the segment
 Segment-table base register (STBR)  points to the
segment table’s location in memory
 Segment-table length register (STLR)  the number of
segments used by a program;
segment number s is legal if s < STLR
Protection for segmentation
 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 a
dynamic storage-allocation problem
 A segmentation example is shown in the following
diagram

Segmentation Hardware
Example
Case study: Intel Pentium
 Supports
 segmentation and
 segmentation with paging
 CPU generates logical address passed on to  the segmentation unit
which produces linear addresses passed on to  paging unit which
generates physical address in main memory.
Intel Pentium Segmentation
Pentium Paging Architecture
Linear Address in Linux
Broken into four parts:
Three-level Paging in Linux