once, so the rank of $\pi$ is $(\pi[1]-1)\cdot (n-1)!$ plus the rank of
$\pi[2\ldots n]$.
-This gives us a~reduction from (un)ranking of permutations on $[n]$ to (un)ranking
+This gives us a~reduction from (un)ranking of permutations on $[n]$ to (un)rank\-ing
of permutations on a $(n-1)$-element set, which suggests a straightforward
algorithm, but unfortunately this set is different from $[n-1]$ and it even
depends on the value of~$\pi[1]$. We could renumber the elements to get $[n-1]$,
\:Return~$\pi$.
\endalgo
-\>We can call $\<Unrank>(j,1,n,[n])$ for the unranking problem on~$[n]$, i.e., to get $L^{-1}(j,[n])$.
+\>We can call $\<Unrank>(j,1,n,[n])$ for the unranking problem on~$[n]$, i.e., to calculate $L^{-1}(j,[n])$.
\para
The most time-consuming parts of the above algorithms are of course operations
machine has to be large as well:
\obs
-$\log n! = \Theta(n\log n)$, therefore the word size~$W$ must be~$\Omega(n\log n)$.
+$\log n! = \Theta(n\log n)$, therefore the word size must be~$\Omega(n\log n)$.
\proof
We have $n^n \ge n! \ge \lfloor n/2\rfloor^{\lfloor n/2\rfloor}$, so $n\log n \ge \log n! \ge \lfloor n/2\rfloor\cdot\log \lfloor n/2\rfloor$.
a~set of restrictions which is a~part of the input, then $P=\#P$.
\proof
-We will show that a~polynomial-time ranking algorithm would imply a~polynomial-time
+We will show that a~polynomial-time ranking algorithm would imply a~po\-ly\-nom\-ial-time
algorithm for computing the permanent of an~arbitrary zero-one matrix, which
is a~$\#P$-complete problem.