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Operating Systems, 112 Practical Session 9, Memory 1.

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Presentation on theme: "Operating Systems, 112 Practical Session 9, Memory 1."— Presentation transcript:

1 Operating Systems, 112 Practical Session 9, Memory 1

2 Quick recap - Swapping Swapping basically means we bring the entire process to memory, use it, and possibly put it back to our store (e.g. large enough disk). Swap time proportional to the amount of swapped memory – a heavy operation. Creates holes in memory. Hardly used anymore… 2

3 Quick recap – Paging and Virtual Memory What happens when the processs memory requirements are too large to fit into the physical memory? Only part of the program reside in the memory while the rest stays in our store. independent of physical memory This means we can support an address space which is independent of physical memory (on a 32 bit machine, there are 2 32 addresses in virtual memory). Paging – divide physical memory into fixed size blocks. 3

4 Quick recap – Paging and Virtual Memory pages The virtual address space is divided into pages. page frames frames The corresponding units on physical memory are called page frames or frames. Memory is managed with the aid of the MMU. The mapping of pages to page frames can be too large to effectively answer our demands. Solution: use a two level page system. 4

5 Quick recap – TLB associative memory Translation Look aside Buffer (associative memory) is a small table residing in the MMU. Each entry contains information about one page. The TLB maps virtual pages to a physical address without going through the page table. Traditionally implemented in hardware (lookup of entries is done in a single step). When a miss occurs, an ordinary page table lookup is done (and the TLB is updated). 5

6 Quick recap – Inverted Page Table The IPT uses one entry per frame (physical memory), instead of per page (virtual memory). on every memory reference Virtual to physical translation may become significantly harder: when process n references virtual page p we now have to go over the entire IPT for an entry (n,p) – this must be done on every memory reference! Tradeoff: amount of memory required for the page table vs. time required to search for a page. Often used with a hash function to speed up search. 6

7 Question 1 Assume a 32 bit system, with 2-level page table (page size is 4K, |p 1 |=|p 2 |=10bits, |offset|=12bits). Program A on this system requires 12 MB of memory. The bottom 4MB of memory for program text, followed by 4MB for data and lastly, the top 4MB for stack. 1. How many page tables are actually required for this process. 2.Describe the lookup within the page tables of address 0x00403004. 7

8 Question 1 We use the following scheme: The 12 least significant digits in this address, allow access for 2 12 bytes – 4 Kb. These are pointed to by any of the 2 10 entries of p 2. In total, a second level page table can point to 2 22 bytes – 4 MB. Each such page table is pointed to by a first level table entry. In our case – we require 4 page tables: a single first level page table, which points to 3 second level page tables. page offset p1p1 p2p2 d 10 12 8

9 Question 1 page number page offset p1p1 p2p2 d 10 12 Top-level page table 0 1 2 3 4 1023 4095 32 bit virtual address, 4K pages, lookup of 0x00403004 (4,206,596 (dec) ) Binary: 0000000001 = 1 (dec) 0000000011 = 3 (dec) 000000000100 = 4 (dec) 1023 0 1 2 3 4 0 1 2 3 4 0 1 2 3 4 4 – 8 MB 12288 – 16383 Byte 9

10 Question 2 Consider a paged memory system with two-level page table. If a memory reference takes 20 nanoseconds (ns), how long does a paged memory reference take? Assume that the second-level page table is always in memory, and: a)There is no TLB, and the needed page is in main memory. b)There is a TLB, with access speed of 0.05 ns, the needed page is in main memory and i.The TLB does not contain information on this page. ii.The TLB contains information on this page. 10

11 Question 2 a)We will need to access the memory thrice: in the first and second accesses we will get the first and second level page table entry. This will point us to the physical address we will access next. Total time: 3x20 = 60ns. b)Remember we first access the TLB: i.Since this entry is not located in the TLB, after examining it, we will revert to the regular lookup scheme (as before). Total time: 0.05+3x20 = 60.05ns. ii.If the entry is in the TLB, after examining it we will know the location of the exact page frame and access it directly. Total time: 0.05+20 = 20.05ns. Note that the use of virtual memory may significantly reduce memory performance. The TLB provides a mechanism to overcome this problem. 11

12 Question 3 Consider a computer with an address space of 32 bits, and a 2K page size. 1.What is the maximal size of the page table (single level), assuming each entry is 4 bytes? What is the maximal size of a programs memory? Does it depends on the size of the pages? 2.Assume a two level page table, in which 8 bits are dedicated for the first level table. What is the maximal size of the 2 nd table? Can we run larger programs now? 3.Assume that first level table is always in memory, page fault happens in 4% of the cases, the second level table is not in memory and page fault occurs in 1% of the cases. Calculate the average access time to a page, if disk access time is 30x10 -6 sec, and memory access time is 100x10 -9 sec. 12

13 Question 3 1.The virtual memory size is 2 32 bytes, and the size of each page is 2K (2 11 bytes). Total number of pages is therefore 2 32 /2 11 =2 21 pages. Since each entry is 4 bytes long, we require 4x2 21 = 2 23 bytes = 8 MB to hold this table. Maximal program size is 4 GB (size of virtual memory), regardless of the page size. 13

14 Question 3 2.Using 8 bits for the first level page table, leaves us with 2 13 bits for the second level page table. The size of the second table is 4x2 13 = 32Kb. The size of the virtual memory stays the same, and we cant run bigger programs. 14

15 Question 3 3.Break this to three cases: 15

16 Question 4 1.What is the minimal size of a single level page table on a 32 bit machine, with 4KB pages? 2.What is the size of a 64 bit machines page table with 4KB pages? How many layers will we need if we want to ensure that each page table will require only a single page? 3.What is the size of the inverted page table, for a computer with 2GB RAM, in which each page is 16KB long and each entry is 8 bytes long? 16

17 Question 4 1.If the address space consists of 2 32 bytes, with 4KB pages, we have 2 32 /2 12 =2 20 entries (over 1 million). Using 4 bytes per entry, we get a 4MB page table. 2.With a 64 bit machine, we need 2 52 entries. Each entry being 8 bytes long results in a more than 30 PetaByes (Peta > Tera > Giga) page table. Limiting page table size to pages, means that we can only use 2 12 /2 3 =2 9 entries in each table, leading to 52/96 layers. That means 6 memory accesses for each address translation. 17

18 Question 4 3. IPT has an entry per frame. That means that we must first divide the physical memory to frames, so we will know the amount of entries: 2GB = 2 31 bytes 2 31 /2 14 = 2 17 entries Each entry is 8 bytes long, so the total size is: 2 17 x2 3 = 2 20 bytes = 1MB 18

19 Question 5.1, Moed Beit 2010 A B exec() A given operating system manages memory with the aid of page tables. It is currently executing two programs, A and B (assume that these do not call exec()). Answer the following questions: B fork() A 1.If B was created as a result of the fork() system call made by A, can the system use the same page table for both programs? AB C 2.Assume that both A and B were created from process C. can the system use the same page table for both programs in this case? B fork() A 3.Now assume that the system is using segmentation with paging and that B was created as a result of the fork() system call made by A. Can the system use the same page table for both programs in at least one segment? 19

20 Question 5.1 1.No. Despite sharing much in common the two programs may execute different code (e.g. allocate memory differently) after the call to fork() is made. 2.No. Although both execute the same code, progress (in terms of code line executed) may be different. As a result, one process can potentially swap out pages required by the other. 3.Yes. Since the code segment is the same for both (no exec calls are allowed), this segment can be maintained in the same page table. 20

21 Question 5.2 TLB page table The time required to read an entry from the TLB in a given system is 10 nsec. Access time to a single level page table entry is a 10 times slower, and requires 100 nsec. What should be the TLB hit rate so that the average time to find a virtual address will be 30 nsec? Explain your calculation 21

22 Question 5.2 The TLB hit rate provides a measure of successful TLB hits when seeking a virtual address. When a successful TLB hit occurs the virtual address is translated directly from the TLB. In contrast, when the page is not in the TLB one has to access the page table. p Let p denote the TLB hit rate. We know that: p10 + (1-p) (10+100) = 30 Thus, the TLB hit rate should be: p=0.8 22

23 Question 5.3 Assume that the TLB includes the following entries: valid bit, modified bit, protection code, virtual address and frame number. single CPU 1.Can a single CPU machine which supports multiple processes use a single such TLB without changing it? If it can, explain how this is done otherwise explain why it cant be done. multi CPU 2.Is the same also true for a multi CPU machine? Explain. 23

24 Question 5.3 1.A single CPU machine can use a single TLB (in fact this was the common setup in the days preceding the multi core CPUs). The important thing to remember is that whenever a new process is running the valid bits of all entries should be marked with a 0 (no frames in cache). 2.This is not true when there are multiple CPUs (or cores). When multiple processes are running both may require the same virtual address which should be translated into two distinct addresses. One means to overcome this problem is by introducing the PID of processes as another entry of the TLB. 24

25 Assignment 3 xv6 memory overview 25

26 xv6 memory overview Virtual memory in xv6 is managed without a backing store. This means that there is no swapping mechanism and that all programs are maintained in the physical memory, at all times. xv6 sets up the segmentation hardware so that virtual and linear addresses are always the same (i.e., segmentation doesn't do anything). Each page is of size 2 12 = 4096 bytes A user process page table includes much of the kernels mapping. However, the page protection bits prevent the user from using anything other than its memory.

27 xv6 memory: virtual to physical translation overview 2 20 | 2 12 Virtual ~ Linear address: Page table 2 20 entries (PTEs) flags 2 20 physical offset PTE Physical address 2 12 (offset) 2 20 (entries) 2 20 bits

28 12 bits xv6 memory: A processs 2 page table structure 10 bits va: PDX(va)PTX(va) Page Directory: [4096 bytes] Entry size: 32 bit 1024 entries Page addr. flags 1024 (Offset) PTE_ADDR(X) page table pages [4096 bytes]

29 Assignment 3 You will add a basic backing store To keep things simple you will add to xv6 the ability to swap processes When free memory descends below a pre-defined threshold process will be swapped-out according to several policies Processes are swapped-in on demand

30 Assignment 3 - Architecture OS Physical memory DISK Swapper Scheduler P1P1 P2P2 P3P3 P4P4 As the system works processes are created and free memory is decreasing The OS then decides to swap a process to diskThe scheduler wishes to run process 2, but memory is still low. The OS swaps process 4 out and process 2 in.

31 Assignment 3 - Architecture Writing to files from within kernel, even though possible is not recommended. Nevertheless, we will do exactly that. Using an additional process (the swapper) that is responsible for disk operations since the scheduler itself should not access the disk The scheduler and swapper must coordinate their operations


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