Operating Systems

IMPORTANT CONFLICT:

Our final is currently scheduled for 5-7PM on tues 11 May. This would prove difficult for students who wish to attend the GSAS convocation on that same afternoon.

I have received permissions to give the exam instead on 4 May (same room, again 5pm). Either date is OK with me (but not both).

Is there anyone who can *NOT* make 4 May (it is "reading day" with no classes or exams)?

Is there anyone who will have a conflict with GSAS convocation if we have the exam as scheduled on 11 May.

End of important conflict

4.4: Page Replacement Algorithms (PRAs)

These are solutions to the replacement question.

Good solutions take advantage of locality.

• Temporal locality: If a word is referenced now, it is likely to be referenced in the near future.
  • This argues for caching referenced words, i.e. keeping the referenced word near the processor for a while.
• Spatial locality: If a word is referenced now, nearby words are likely to be referenced in the near future.
  • This argues for prefetching words around the currently referenced word.
• These are lumped together into locality: If any word in a page is referenced, each word in the page is “likely” to be referenced.
  • So it is good to bring in the entire page on a miss and to keep the page in memory for a while.
• When programs begin there is no history so nothing to base locality on. At this point the paging system is said to be undergoing a “cold start”.
• Programs exhibit “phase changes”, when the set of pages referenced changes abruptly (similar to a cold start). At the point of a phase change, many page faults occur because locality is poor.

Pages belonging to processes that have terminated are of course perfect choices for victims.

Pages belonging to processes that have been blocked for a long time are good choices as well.

Random PRA

A lower bound on performance. Any decent scheme should do better.

4.4.1: The optimal page replacement algorithm (opt PRA) (aka Belady's min PRA)

Replace the page whose next reference will be furthest in the future.

• Also called Belady's min algorithm.
• Provably optimal. That is, generates the fewest number of page faults.
• Unimplementable: Requires predicting the future.
• Good upper bound on performance.

4.4.2: The not recently used (NRU) PRA

Divide the frames into four classes and make a random selection from the lowest nonempty class.

0. Not referenced, not modified
1. Not referenced, modified
2. Referenced, not modified
3. Referenced, modified

Assumes that in each PTE there are two extra flags R (sometimes called U, for used) and M (often called D, for dirty).

Also assumes that a page in a lower priority class is cheaper to evict.

• If not referenced, probably will not referenced again soon and hence is a good candidate for eviction.
• If not modified, do not have to write it out so the cost of the eviction is lower.
• When a page is brought in, OS resets R and M (i.e. R=M=0)
• On a read, hardware sets R.
• On a write, hardware sets R and M.

We again have the prisoner problem, we do a good job of making little ones out of big ones, but not the reverse. Need more resets.

Every k clock ticks, reset all R bits

• Why not reset M?
  Answer: Must have M accurate to know if victim needs to be written back
• Could have two M bits one accurate and one reset, but I don't know of any system (or proposal) that does so.

What if the hardware doesn't set these bits?

• OS can use tricks
• When the bits are reset, make the PTE indicate the page is not resident (i.e. lie). On the page fault, set the appropriate bit(s).

4.4.3: FIFO PRA

Simple but poor since usage of the page is ignored.

Belady's Anomaly: Can have more frames yet generate more faults. Example given later.

The natural implementation is to have a queue of nodes each pointing to a page.

• When a page is loaded, a node referring to the page is appended to the tail of the queue.
• When a page needs to be evicted, the head node is removed and the page referenced is chosen as the victim.

4.4.4: Second chance PRA

Similar to the FIFO PRA, but altered so that a page recently referenced is given a second chance.

• When a page is loaded, a node referring to the page is appended to the tail of the queue. The R bit of the page is naturally cleared.
• When a page needs to be evicted, the head node is removed and the page referenced is the potential victim.
• If the R bit on this page is cleared (the page hasn't been referenced recently), then the page is the victim.
• If the R bit is set, then the bit is cleared, the node referring to this page is appended to the rear of the queue (so it appears to have just been loaded), and the current head node becomes the potential victim.
• What if all the R bits are set?
• We will move each page from the front to the rear and will arrive at the initial condition but with all the R bits now clear. Hence we will remove the same page as fifo would have removed, but will have spent more time doing so.
• Might want to periodically clear all the R bits so that a long ago reference is forgotten (but so is a recent reference).

4.4.5: Clock PRA

Same algorithm as 2nd chance, but a better implementation for the nodes: Use a circular list with a single pointer serving as both head and tail.

Let us begin by assuming that the number of pages loaded is constant.

• So the size of the node list in 2nd chance is constant.
• Use a circular list for the nodes and have a pointer pointing to the head entry. Think of the list as the hours on a clock and the pointer as the hour hand.
• Since the number of nodes is constant, the operation we need to support is replace the “oldest” page by a new page.
• Examine the node pointed to by the (hour) hand. If the R bit of the corresponding page is set, we give the page a second chance: clear the R bit, move the hour hand (now P looks freshly loaded), and examine the next node.
• Eventually we will reach a node whose corresponding R bit is clear. The corresponding page is the victim.
• Replace the victim with the new page (may involve 2 I/Os as always).
• Update the node to refer to this new page.
• Move the hand forward another hour so that the new page is at the rear.

What if the number of pages is not constant?

• We now have to support inserting a node right before the hour hand (the rear of the queue) and removing the node pointed to by the hour hand.
• The natural solution is to double link the circular list.
• In this case insertion and deletion are a little slower than for the primitive 2nd chance (double linked lists have more pointer updates for insert and delete).
• So the trade-off is that if there are mostly inserts and deletes and granting 2nd chances is not too common, use the original 2nd chance implementation. If there are mostly replacements and you often give nodes a 2nd chance, use clock.

LIFO PRA

This is terrible! Why?
Ans: All but the last frame are frozen once loaded so you can replace only one frame. This is especially bad after a phase shift in the program when it is using all new pages.

4.4.6: Least Recently Used (LRU) PRA

When a page fault occurs, choose as victim that page that has been unused for the longest time, i.e. that has been least recently used.

LRU is definitely

• Implementable: The past is knowable.
• Good: Simulation studies have shown this.
• Difficult. Essentially need to either:
  1. Keep a time stamp in each PTE, updated on each reference and scan all the PTEs when choosing a victim to find the PTE with the oldest timestamp.
  2. Keep the PTEs in a linked list in usage order, which means on each reference moving the PTE to the end of the list

Homework: 29, 23

A hardware cutsie in Tanenbaum

• For n pages, keep an nxn bit matrix.
• On a reference to page i, set row i to all 1s and col i to all 0s
• At any time the 1 bits in the rows are ordered by inclusion. I.e. one row's 1s are a subset of another row's 1s, which is a subset of a third. (Tanenbaum forgets to mention this.)
• So the row with the fewest 1s is a subset of all the others and is hence least recently used.
• This row also has the smallest value, when treated as an unsigned binary number. So the hardware can do a comparison of the rows rather than counting the number of 1 bits.
• Cute, but still impractical.

4.4.7: Simulating (Approximating) LRU in Software

The Not Frequently Used (NFU) PRA

• Include a counter in each PTE (and have R in each PTE).
• Set counter to zero when page is brought into memory.
• For each PTE, every k clock ticks.
  1. Add R to counter.
  2. Clear R.
• Choose as victim the PTE with lowest count.

The Aging PRA

NFU doesn't distinguish between old references and recent ones. The following modification does distinguish.

• Include a counter in each PTE (and have R in each PTE).
• Set counter to zero when page is brought into memory.
• For each PTE, every k clock ticks.
  1. Shift counter right one bit.
  2. Insert R as new high order bit (HOB).
  3. Clear R.
• Choose as victim the PTE with lowest count.

Homework: 25, 34

4.4.8: The Working Set Page Replacement Problem (Peter Denning)

The working set policy (Peter Denning)

The goal is to specify which pages a given process needs to have memory resident in order for the process to run without too many page faults.

• But this is impossible since it requires predicting the future.
• So we make the assumption that the immediate future is well approximated by the immediate past.
• We measure time in units of memory references, so t=1045 means the time when the 1045th memory reference is issued.
• In fact we measure time separately for each process, so t=1045 really means the time when this process made its 1045th memory reference.
• W(t,&omega) is the set of pages referenced (by the given process) from time t-ω to time t.
• That is, W(t,ω) is the set pages referenced during the window of size ω ending at time t.
• That is, W(t,ω) is the set of pages referenced by the last ω memory references ending at reference t.
• W(t,ω) is called the working set at time t (with window ω).
• w(t,ω) is the size of the set W(t,ω), i.e. is the number of pages referenced in the window.

The idea of the working set policy is to ensure that each process keeps its working set in memory.

• Allocate w(t,ω) frames to each process. This number differs for each process and changes with time.
• On a fault, one evicts a page not in the working set. But it is not easy to find such a page quickly.
• Indeed determining W(t,ω) precisely is quite time consuming and difficult. It is never done in real systems.
• If a process is suspended, it is often swapped out; the working set then can be used to say which pages should be brought back when the process is resumed.

Homework: Describe a process (i.e., a program) that runs for a long time (say hours) and always has w<10[ Assume ω=100,000, the page size is 4KB. The program need not be practical or useful.

Homework: Describe a process that runs for a long time and (except for the very beginning of execution) always has w>1000. Assume ω=100,000, the page size is 4KB. The program need not be practical or useful.

The definition of Working Set is local to a process. That is, each process has a working set; there is no system wide working set other than the union of all the working sets of each process.

However, the working set of a single process has effects on the demand paging behavior and victim selection of other processes. If a process's working set is growing in size, i.e. w(t,ω) is increasing as t increases, then we need to obtain new frames from other processes. A process with a working set decreasing in size is a source of free frames. We will see below that this is an interesting amalgam of local and global replacement policies.

Interesting questions concerning the working set include:

• What value should be used for ω?
  Experiments have been done and ω is surprisingly robust (i.e., for a given system a fixed value works reasonably for a wide variety of job mixes).
• How should we calculate W(t,ω)?
  Hard so do exactly so ...

... Various approximations to the working set, have been devised. We will study two: using virtual time instead of memory references (immediately below) and Page Fault Frequency (section 4.6). In 4.4.9 we will see the popular WSClock algorithm that includes an approximation of the working set as well as several other ideas.

Using virtual time

• Approximate the working set by those pages referenced during the last m milliseconds rather than the last ω memory references. Note that the time is measured only while this process is running, i.e., we are using virtual time.
• Clear the reference bit every m milliseconds and set it on every reference.
• To choose a victim, we need to find a page with the R bit clear.
• Essentially we have reduced the working set policy to NRU.

4.4.9: The WSClock Page Replacement Algorithm

This treatment is based on one by Prof. Ernie Davis.

Tannenbaum suggests that the WSClock Page Replacement Algorithm is a natural outgrowth of the idea of a working set. However, reality is less clear cut. WSClock is actually embodies several ideas one of which is connected to the idea of a working set. As the name suggests another of the ideas is the clock implementation of 2nd chance.

The actual implemented algorithm is somewhat complicated and not a clean elegant concept. It is important because

1. It works well and is in common use.
2. The embodied ideas are themselves interesting.
3. Inelegant amalgamations of ideas are more commonly used in real systems than clean, elegant, one-idea algorithms.

Since the algorithm is complicated we present it in stages. As stated above this is an important algorithm since it works well and is used in practice. However, I certainly do not assume you remember all the details.

1. We start by associating a node with every page loaded in memory (i.e., with every frame given to this process). In the node are stored R and M bits that we assume are set by the hardware. (Of course we don't design the hardware so really the R and M bits are set in a hardware defined table and the nodes reference the entries in that table.) Every k clock ticks the R bit is reset. So far this looks like NRU.

   To ease the explanation we will assume k=1, i.e., actions are done each clock tick.

2. We now introduce an LRU aspect (with the virtual time approximation described above for working set): At each clock tick we examine all the nodes for the running process and store the current virtual time in all nodes for which R is 1.

   Thus, the time field is an approximation to the time of the most recent reference, accurate to the clock period. Note that this is done every clock tick (really every k ticks) and not every memory reference. That is why it is feasible.

   If we chose as victim the page with the smallest time field, we would be implementing a virtual time approximation to LRU. But in fact we do more

3. We now introduce some working set aspects into the algorithm by first defining a time constant τ (analogous to ω in the working set algorithm) and consider all pages older than τ (i.e., their stored time is smaller than the current time minus τ) as candidate victims. The idea is that these pages are not in the working set.

   The OS designer needs to tune τ just as one would need to tune ω and, like ω, τ is quite robust (the same value works well for a variety of job mixes).

   The advantage of introducing τ is that a victim search can stop as soon as a page older than τ is found.

   If no pages have a reference time older than Tau, then the page with the earliest time is the victim.

4. Next we introduce the other aspect of NRU, preferring clean to dirty victims. We search until we find a clean page older than τ, if there is one; if not, we use a dirty page older than τ.
   
   
5. Now we introduce an optimization similar to prefetching (i.e., speculatively fetching some data before it is known to be needed). Specifically, when we encounter a dirty page older than τ (while looking for a clean old page), we write the dirty page back to disk (and clear the M bit, which Tanenbaum forgot to mention) without evicting the page, on the presumption that, since the page is not in (our approximation to) the working set, this I/O will be needed eventually. The down side is that the page could become dirty again, rendering our speculative I/O redundant.

   Suppose we've decided to write out old dirty pages D₁ through D_d and to replace old clean page C with new page N.

   We must block the current process P until N is completely read in, but P can run while D₁ through D_d are being written. Hence we would desire the I/O read to be done the writes, but we shall see later that there are other considerations for choosing the order to perform I/O operations.

   Similarly, suppose we can not find an old clean page and have decided to replace old dirty page D₀ with new page N, and have detected additional old dirty pages D₁ through D_d (recall that we were searching for an old clean page). Then P must block until D₀ has been written and N has been read, but can run while D₁ through D_d are being written.

6. We throttle the previous optimization to prevent overloading the I/O subsystem. Specifically we set a limit on the number of dirty pages the previous optimization can request be written.
   
   
7. Finally, as in the clock algorithm, we keep the data structure (nodes associated with pages) organized as a circular list with a single pointer (the hand of the clock). Hence we start each victim search where the previous one left off.

   It is not so clear why this is important. As with the clock algorithm, using both front and rear pointers would cause extra work when skipping over nodes, but why not simply use a linear list with just a single pointer to the beginning and always starting there? Perhaps keeping a bit of FIFO is helpful (recall that the first old clean page is chosen, so where we start does effect the choice).

4.4.10: Summary of Page Replacement Algorithms