94 lines
4 KiB
Markdown
94 lines
4 KiB
Markdown
### Aravind’s algorithm
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Problem with Lamport's "Bakery" algorithm: registers must be unbounded (every invocation of lock potentially increases the counter by 1 -> domain of the registers is all natural numbers!)
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For all processes, we have a FLAG and a STAGE (both binary MRSW) and a DATE (MRMW) register that ranges from 1 to 2n.
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```
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For all i, initialize
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FLAG[i] to down
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STAGE[i] to 0
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DATE[i] to i
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lock(i) :=
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FLAG[i] <- up
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repeat
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STAGE[i] <- 0
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wait (foreach j != i, FLAG[j] = down OR DATE[i] < DATE[j])
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STAGE[i] <- 1
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until foreach j != i, STAGE[j] = 0
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unlock(i) :=
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tmp <- max_j{DATE[j]}+1
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if tmp >= 2n
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then foreach j, DATE[j] <- j
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else DATE[i] <- tmp
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STAGE[i] <- 0
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FLAG[i] <- down
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```
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#### MUTEX proof
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**Theorem:** if $p_i$ is in the CS, then $p_j$ cannot simultaneously be in the CS.
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*Proof:* by contradiction.
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Let's consider the execution of $p_i$ leading to its CS:
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![[Pasted image 20250310172134.png]]
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**Corollary** (of the MUTEX proof)**:** DATE is never written concurrently.
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#### Bounded bypass proof
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**Lemma 1:** exactly after n CSs there is a reset of DATE.
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*Proof:*
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- the first CS leads $max_j{DATE[j]}$ to n+1
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- the seconds CS leads ... to n+2
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- ...
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- the n-th read leads ... to n+n = 2n -> RESET
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**Lemma 2:** there can be at most one reset of DATE during an invocation of a lock
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*Proof:*
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- let $p_i$ invoke lock, if no reset occurs, ok
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- otherwise, let us consider the moment in which a reset occurs
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- if pi is the next process that enters the CS, ok
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- Otherwise let $p_j$ be the process that enters; its next date is $n+1 > DATE[i]$
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- $p_{j}$ cannot surpass $p_i$ again (before a RESET)
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- The worst case is then all processes perform lock together and $i = n$ (i am process n)
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- all $p_{1}\dots p_{n}$ surpass $p_{n}$
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- then $p_n$ enters and it resets the DATE in its unlock
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- only 1 reset and it is the worst case!
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**Theorem:** the algorithm satisfies bounded bypass with bound $2n-2$.
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*Proof:*
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![[Pasted image 20250310103703.png]]
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so by this, the very worst possible case is that my lock experiences that.
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It looks like I can experience at most $2n-1$ other critical sections, but it is even better, let's see:
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- $p_n$ invokes lock alone, completes its CS (the first after the reset) and its new DATE is n+1
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- all processes invoke lock simultaneously
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- $p_{n}$ has to wait all other processes to complete their CSs
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- when $p_{n-1}$ completes its CS, its new DATE will be $n+(n-1)+1=2n$ -> RESET
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- now all $p_{1}\dots p_{n-1}$ invoke lock again and complete their CSs (after that $p_i$ completes its CS, now it has `DATE[i] <- n+i`, because as everyone invoked lock after the RESET, max date was `n`)
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- so $p_n$ has to wait n-1 CSs for the reset, and another n-1 CSs before entering again. **Literally the worst case is when the process is the first of the first round, and the last of the last round.**
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#### Improvement of Aravind’s algorithm
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```
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unlock(i) :=
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∀j≠i.if DATE[j] > DATE[i] then
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DATE[j] <- DATE[j]-1
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DATE[i] <- n
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STAGE[i] <- 0
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FLAG[i] <- down
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```
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Since the LOCK is like before, the revised protocol satisfies MUTEX. Furthermore, you can prove that it satisfies bounded bypass with bound n-1 -> EXERCISE!
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>[!note] let's remember ourselves [[### Aravind’s algorithm|the locking function]]
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(a causa di un bug, riavvia Obsidian se non vedi la dimostrazione qui sotto)
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>[!question]- mostra mia soluzione
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>- $p_n$ invokes lock alone, completes its CS and so `DATE[n] = n`
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>- then as DATE is either set to n or decreased, for each i, `DATE[i] < n`
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>- *scenario 1*: every other $p_i$ keep invoking lock again immediately after the unlock
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> - every time some process exits the CS, `DATE[n]` is decreased
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> - after $n-1$ turns, `DATE[n]` will have `DATE[n] = 1`, with every other `DATE[i] > 1, i!=n` -> ️✅
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>- *scenario 2*: not every process invokes the lock
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> - eventually, more than one process will have its DATE set to 0
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> - but there will still be at most $n-1$ processes $p_i$ with `DATE[i] < DATE[n]`
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> - this ensures that after $n-1$ steps, every other process $p_i$ will have `DATE[i] > DATE[n]` -> ✅
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