I'm designing an in-place sorting algorithm to sort a collection of size $n$. Near the end of the sorting, it may end up with with $\log{n}$ sorted sub-sequences of size $\frac{n}{\log{n}}$. At this point, I use a very simple $k$-way merge algorithm that merges the sub-sequences pairwise until everything has been merged. This very case apparently represents the complexity bottleneck of the algorithm.

I'm repeatedly using the C++ function std::inplace_merge to perform the merging operations, which performs $Θ(N \log{N})$ comparisons most of the time, but may perform up to $O(N \log^2{N})$ comparisons if there isn't enough extra memory available, where $N$ corresponds to the sum of the sizes of the sequences to merge (in our case $2\frac{n}{\log{n}}$).

Taking all of that information into account, I can tell that repeatedly merging the sub-sequences pairwise until everything has been merged takes the following number of comparisons, step by step:

  • Step 1: $O(\frac{\log{n}}{2} * \frac{2n}{\log{n}} * \log^2{\frac{2n}{\log{n}}}) = O(n * \log^2{\frac{2n}{\log{n}}})$
  • Step 2: $O(\frac{\log{n}}{4} * \frac{4n}{\log{n}} * \log^2{\frac{4n}{\log{n}}}) = O(n * \log^2{\frac{4n}{\log{n}}})$
  • Step 3: $O(\frac{\log{n}}{8} * \frac{8n}{\log{n}} * \log^2{\frac{8n}{\log{n}}}) = O(n * \log^2{\frac{8n}{\log{n}}})$
  • $\ldots$

If I'm not mistaken, there will be $\log{k}$ steps where $k$ is number of sorted sub-sequences in the original collection, which is is $\log{n}$, hence there will be $\log{\log{n}}$ steps. This should yield an overall complexity along the lines of $O(\log{\log{n}} * n * \log^2{\frac{?n}{\log{n}}})$.

Now, to be perfectly honest, I've got no idea how to simplify this expression further, and since I'm describing a sorting algorithm, I would like to know whether it is more along the lines of $O(n \log{n})$ or $O(n \log^2{n})$.

Having computed the complexity of the other two steps of the algorithm, it appears that none of them performs more than $O(n \log{\frac{n}{\log{n}}})$ comparisons¹, which is intuitively smaller than $O(n \log{n})$, the lower bound for comparison sorting, so the k-way merge surely dominates the overall complexity and thus performs at least $O(n \log{n})$ comparisons.

Can you help me solve this complexity problem?

¹ Among the other steps, the bigger one is sorting $\log{n}$ sub-sequences of size $\frac{n}{\log{n}}$ with an $O(N \log{N})$ sorting algorithm, which has the complexity $O(\log{n} * \frac{n}{\log{n}} \log{\frac{n}{\log{n}}}) = O(n \log{\frac{n}{\log{n}}})$.


1 Answer 1


First of all, notice that whatever you were doing, the complexity up to this point can not possibly be $o(n \log n)$. If that were true, we could merge each sorted subsequence in time $O(n \log \log n)$, violating the well known bound of $\Omega(n \log n)$ for the worst case of a general sorting algorithm. In fact, $$\Theta\left(n \log \frac{n}{\log n} \right) = \Theta(n \log n - n \log \log n) = \Theta (n \log n)$$

Now, let's analyze the complexity of what you are proposing. In order to visualize all the merging that's going on, imagine inserting each sorted subsequence into a FIFO queue. At each step, we take the first two sequences of the queue, merge them, and put the result at the back of the queue. We take note of the sequence that is initially in front of the queue, and define a round as the set of all merging operations that happen between two subsequent appearances of the initial sequence at the front of the queue.

Observe that each round splits in half the queue size: let's say there are $r$ rounds, with $r \in \Theta(\log \log n)$. Let $\alpha = \frac{n}{\log n}$. Before the $h-$th round begins, the queue contains $\frac{n}{2^h \alpha}$ subsequences, each of which has length $2^h \alpha$. Therefore, the complexity of round $h$ is:

$$ \Theta\left( \frac{n}{2^{h+1} \alpha} \left( 2^{h+1} \alpha \log (2^{h+1} \alpha) \right) \right) = \Theta \left( n \log (2^{h+1} \alpha) \right) $$

This yields an overall complexity of:

$$ \Theta\left( \sum_{h=0}^{r-1} n \log (2^{h+1} \alpha) \right) = \Theta\left( nr \log \alpha + n\sum_{h=0}^{r-1} \log 2^{h+1} \right ) = \Theta\left( nr \log \alpha + nr^2 \right ) $$

Now, remembering that:

$$ \Theta \left( \log \alpha \right) = \Theta \left( \log n - \log \log n \right) = \Theta(\log n) $$

We conclude:

$$ \Theta\left( nr \log \alpha + nr^2 \right ) = \Theta(n \log n \log \log n) $$

  • $\begingroup$ Hum, looks like I'll have to improve my skills to understand complexity simplification; not everything is clear to me (but only because I lack knowledge). The conclusion looks interesting though. $\endgroup$
    – Morwenn
    Jan 5, 2017 at 8:26
  • $\begingroup$ I also realize that I was more tired than I thought and ourigth gave incorrect complexities for std::inplace_merge (and gave the complexity of std::stable_sort instead for some reason): it's Θ(N), and O(N log N) when there isn't extra memory available. Anyway, since you performed the complexity analysis for N log N, I guess that your conclusion actually gives the worst performance of my algorithm when then isn't extra memory available :) $\endgroup$
    – Morwenn
    Jan 5, 2017 at 14:11
  • $\begingroup$ So... if there is extra memory available and std::inplace_merge is O(N), then the merging step becomes O(n log k) = O(n log log n), but the complexity is dominated by the O(n log n) step of sorting the sub-sequences. However, if there isn't extra available and std::inplace_merge is O(N log N), then the merging step dominates the complexity with O(n log n log log n). Did I make a mistake? $\endgroup$
    – Morwenn
    Jan 5, 2017 at 15:06
  • $\begingroup$ That seems correct. $\endgroup$
    – quicksort
    Jan 5, 2017 at 15:27
  • $\begingroup$ Ok, I understand better now, thank you very much for everything :) $\endgroup$
    – Morwenn
    Jan 5, 2017 at 15:29

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